2854 строки
85 KiB
C
2854 строки
85 KiB
C
/*
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* mm/page-writeback.c
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*
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* Copyright (C) 2002, Linus Torvalds.
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* Copyright (C) 2007 Red Hat, Inc., Peter Zijlstra
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*
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* Contains functions related to writing back dirty pages at the
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* address_space level.
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*
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* 10Apr2002 Andrew Morton
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* Initial version
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*/
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#include <linux/kernel.h>
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#include <linux/export.h>
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#include <linux/spinlock.h>
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#include <linux/fs.h>
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#include <linux/mm.h>
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#include <linux/swap.h>
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#include <linux/slab.h>
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#include <linux/pagemap.h>
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#include <linux/writeback.h>
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#include <linux/init.h>
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#include <linux/backing-dev.h>
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#include <linux/task_io_accounting_ops.h>
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#include <linux/blkdev.h>
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#include <linux/mpage.h>
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#include <linux/rmap.h>
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#include <linux/percpu.h>
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#include <linux/notifier.h>
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#include <linux/smp.h>
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#include <linux/sysctl.h>
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#include <linux/cpu.h>
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#include <linux/syscalls.h>
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#include <linux/buffer_head.h> /* __set_page_dirty_buffers */
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#include <linux/pagevec.h>
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#include <linux/timer.h>
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#include <linux/sched/rt.h>
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#include <linux/sched/signal.h>
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#include <linux/mm_inline.h>
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#include <trace/events/writeback.h>
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#include "internal.h"
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/*
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* Sleep at most 200ms at a time in balance_dirty_pages().
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*/
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#define MAX_PAUSE max(HZ/5, 1)
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/*
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* Try to keep balance_dirty_pages() call intervals higher than this many pages
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* by raising pause time to max_pause when falls below it.
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*/
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#define DIRTY_POLL_THRESH (128 >> (PAGE_SHIFT - 10))
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/*
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* Estimate write bandwidth at 200ms intervals.
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*/
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#define BANDWIDTH_INTERVAL max(HZ/5, 1)
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#define RATELIMIT_CALC_SHIFT 10
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/*
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* After a CPU has dirtied this many pages, balance_dirty_pages_ratelimited
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* will look to see if it needs to force writeback or throttling.
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*/
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static long ratelimit_pages = 32;
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/* The following parameters are exported via /proc/sys/vm */
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/*
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* Start background writeback (via writeback threads) at this percentage
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*/
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int dirty_background_ratio = 10;
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/*
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* dirty_background_bytes starts at 0 (disabled) so that it is a function of
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* dirty_background_ratio * the amount of dirtyable memory
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*/
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unsigned long dirty_background_bytes;
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/*
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* free highmem will not be subtracted from the total free memory
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* for calculating free ratios if vm_highmem_is_dirtyable is true
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*/
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int vm_highmem_is_dirtyable;
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/*
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* The generator of dirty data starts writeback at this percentage
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*/
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int vm_dirty_ratio = 20;
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/*
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* vm_dirty_bytes starts at 0 (disabled) so that it is a function of
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* vm_dirty_ratio * the amount of dirtyable memory
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*/
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unsigned long vm_dirty_bytes;
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/*
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* The interval between `kupdate'-style writebacks
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*/
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unsigned int dirty_writeback_interval = 5 * 100; /* centiseconds */
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EXPORT_SYMBOL_GPL(dirty_writeback_interval);
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/*
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* The longest time for which data is allowed to remain dirty
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*/
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unsigned int dirty_expire_interval = 30 * 100; /* centiseconds */
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/*
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* Flag that makes the machine dump writes/reads and block dirtyings.
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*/
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int block_dump;
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/*
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* Flag that puts the machine in "laptop mode". Doubles as a timeout in jiffies:
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* a full sync is triggered after this time elapses without any disk activity.
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*/
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int laptop_mode;
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EXPORT_SYMBOL(laptop_mode);
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/* End of sysctl-exported parameters */
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struct wb_domain global_wb_domain;
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/* consolidated parameters for balance_dirty_pages() and its subroutines */
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struct dirty_throttle_control {
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#ifdef CONFIG_CGROUP_WRITEBACK
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struct wb_domain *dom;
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struct dirty_throttle_control *gdtc; /* only set in memcg dtc's */
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#endif
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struct bdi_writeback *wb;
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struct fprop_local_percpu *wb_completions;
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unsigned long avail; /* dirtyable */
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unsigned long dirty; /* file_dirty + write + nfs */
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unsigned long thresh; /* dirty threshold */
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unsigned long bg_thresh; /* dirty background threshold */
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unsigned long wb_dirty; /* per-wb counterparts */
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unsigned long wb_thresh;
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unsigned long wb_bg_thresh;
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unsigned long pos_ratio;
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};
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/*
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* Length of period for aging writeout fractions of bdis. This is an
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* arbitrarily chosen number. The longer the period, the slower fractions will
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* reflect changes in current writeout rate.
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*/
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#define VM_COMPLETIONS_PERIOD_LEN (3*HZ)
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#ifdef CONFIG_CGROUP_WRITEBACK
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#define GDTC_INIT(__wb) .wb = (__wb), \
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.dom = &global_wb_domain, \
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.wb_completions = &(__wb)->completions
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#define GDTC_INIT_NO_WB .dom = &global_wb_domain
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#define MDTC_INIT(__wb, __gdtc) .wb = (__wb), \
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.dom = mem_cgroup_wb_domain(__wb), \
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.wb_completions = &(__wb)->memcg_completions, \
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.gdtc = __gdtc
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static bool mdtc_valid(struct dirty_throttle_control *dtc)
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{
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return dtc->dom;
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}
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static struct wb_domain *dtc_dom(struct dirty_throttle_control *dtc)
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{
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return dtc->dom;
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}
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static struct dirty_throttle_control *mdtc_gdtc(struct dirty_throttle_control *mdtc)
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{
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return mdtc->gdtc;
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}
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static struct fprop_local_percpu *wb_memcg_completions(struct bdi_writeback *wb)
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{
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return &wb->memcg_completions;
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}
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static void wb_min_max_ratio(struct bdi_writeback *wb,
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unsigned long *minp, unsigned long *maxp)
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{
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unsigned long this_bw = wb->avg_write_bandwidth;
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unsigned long tot_bw = atomic_long_read(&wb->bdi->tot_write_bandwidth);
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unsigned long long min = wb->bdi->min_ratio;
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unsigned long long max = wb->bdi->max_ratio;
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/*
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* @wb may already be clean by the time control reaches here and
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* the total may not include its bw.
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*/
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if (this_bw < tot_bw) {
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if (min) {
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min *= this_bw;
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do_div(min, tot_bw);
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}
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if (max < 100) {
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max *= this_bw;
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do_div(max, tot_bw);
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}
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}
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*minp = min;
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*maxp = max;
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}
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#else /* CONFIG_CGROUP_WRITEBACK */
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#define GDTC_INIT(__wb) .wb = (__wb), \
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.wb_completions = &(__wb)->completions
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#define GDTC_INIT_NO_WB
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#define MDTC_INIT(__wb, __gdtc)
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static bool mdtc_valid(struct dirty_throttle_control *dtc)
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{
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return false;
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}
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static struct wb_domain *dtc_dom(struct dirty_throttle_control *dtc)
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{
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return &global_wb_domain;
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}
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static struct dirty_throttle_control *mdtc_gdtc(struct dirty_throttle_control *mdtc)
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{
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return NULL;
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}
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static struct fprop_local_percpu *wb_memcg_completions(struct bdi_writeback *wb)
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{
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return NULL;
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}
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static void wb_min_max_ratio(struct bdi_writeback *wb,
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unsigned long *minp, unsigned long *maxp)
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{
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*minp = wb->bdi->min_ratio;
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*maxp = wb->bdi->max_ratio;
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}
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#endif /* CONFIG_CGROUP_WRITEBACK */
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/*
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* In a memory zone, there is a certain amount of pages we consider
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* available for the page cache, which is essentially the number of
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* free and reclaimable pages, minus some zone reserves to protect
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* lowmem and the ability to uphold the zone's watermarks without
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* requiring writeback.
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*
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* This number of dirtyable pages is the base value of which the
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* user-configurable dirty ratio is the effictive number of pages that
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* are allowed to be actually dirtied. Per individual zone, or
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* globally by using the sum of dirtyable pages over all zones.
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*
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* Because the user is allowed to specify the dirty limit globally as
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* absolute number of bytes, calculating the per-zone dirty limit can
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* require translating the configured limit into a percentage of
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* global dirtyable memory first.
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*/
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/**
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* node_dirtyable_memory - number of dirtyable pages in a node
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* @pgdat: the node
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*
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* Returns the node's number of pages potentially available for dirty
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* page cache. This is the base value for the per-node dirty limits.
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*/
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static unsigned long node_dirtyable_memory(struct pglist_data *pgdat)
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{
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unsigned long nr_pages = 0;
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int z;
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for (z = 0; z < MAX_NR_ZONES; z++) {
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struct zone *zone = pgdat->node_zones + z;
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if (!populated_zone(zone))
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continue;
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nr_pages += zone_page_state(zone, NR_FREE_PAGES);
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}
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/*
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* Pages reserved for the kernel should not be considered
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* dirtyable, to prevent a situation where reclaim has to
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* clean pages in order to balance the zones.
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*/
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nr_pages -= min(nr_pages, pgdat->totalreserve_pages);
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nr_pages += node_page_state(pgdat, NR_INACTIVE_FILE);
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nr_pages += node_page_state(pgdat, NR_ACTIVE_FILE);
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return nr_pages;
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}
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static unsigned long highmem_dirtyable_memory(unsigned long total)
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{
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#ifdef CONFIG_HIGHMEM
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int node;
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unsigned long x = 0;
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int i;
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for_each_node_state(node, N_HIGH_MEMORY) {
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for (i = ZONE_NORMAL + 1; i < MAX_NR_ZONES; i++) {
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struct zone *z;
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unsigned long nr_pages;
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if (!is_highmem_idx(i))
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continue;
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z = &NODE_DATA(node)->node_zones[i];
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if (!populated_zone(z))
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continue;
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nr_pages = zone_page_state(z, NR_FREE_PAGES);
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/* watch for underflows */
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nr_pages -= min(nr_pages, high_wmark_pages(z));
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nr_pages += zone_page_state(z, NR_ZONE_INACTIVE_FILE);
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nr_pages += zone_page_state(z, NR_ZONE_ACTIVE_FILE);
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x += nr_pages;
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}
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}
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/*
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* Unreclaimable memory (kernel memory or anonymous memory
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* without swap) can bring down the dirtyable pages below
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* the zone's dirty balance reserve and the above calculation
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* will underflow. However we still want to add in nodes
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* which are below threshold (negative values) to get a more
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* accurate calculation but make sure that the total never
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* underflows.
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*/
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if ((long)x < 0)
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x = 0;
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/*
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* Make sure that the number of highmem pages is never larger
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* than the number of the total dirtyable memory. This can only
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* occur in very strange VM situations but we want to make sure
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* that this does not occur.
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*/
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return min(x, total);
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#else
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return 0;
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#endif
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}
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/**
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* global_dirtyable_memory - number of globally dirtyable pages
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*
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* Returns the global number of pages potentially available for dirty
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* page cache. This is the base value for the global dirty limits.
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*/
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static unsigned long global_dirtyable_memory(void)
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{
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unsigned long x;
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x = global_zone_page_state(NR_FREE_PAGES);
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/*
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* Pages reserved for the kernel should not be considered
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* dirtyable, to prevent a situation where reclaim has to
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* clean pages in order to balance the zones.
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*/
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x -= min(x, totalreserve_pages);
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x += global_node_page_state(NR_INACTIVE_FILE);
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x += global_node_page_state(NR_ACTIVE_FILE);
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if (!vm_highmem_is_dirtyable)
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x -= highmem_dirtyable_memory(x);
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return x + 1; /* Ensure that we never return 0 */
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}
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/**
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* domain_dirty_limits - calculate thresh and bg_thresh for a wb_domain
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* @dtc: dirty_throttle_control of interest
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*
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* Calculate @dtc->thresh and ->bg_thresh considering
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* vm_dirty_{bytes|ratio} and dirty_background_{bytes|ratio}. The caller
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* must ensure that @dtc->avail is set before calling this function. The
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* dirty limits will be lifted by 1/4 for PF_LESS_THROTTLE (ie. nfsd) and
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* real-time tasks.
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*/
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static void domain_dirty_limits(struct dirty_throttle_control *dtc)
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{
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const unsigned long available_memory = dtc->avail;
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struct dirty_throttle_control *gdtc = mdtc_gdtc(dtc);
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unsigned long bytes = vm_dirty_bytes;
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unsigned long bg_bytes = dirty_background_bytes;
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/* convert ratios to per-PAGE_SIZE for higher precision */
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unsigned long ratio = (vm_dirty_ratio * PAGE_SIZE) / 100;
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unsigned long bg_ratio = (dirty_background_ratio * PAGE_SIZE) / 100;
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unsigned long thresh;
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unsigned long bg_thresh;
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struct task_struct *tsk;
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/* gdtc is !NULL iff @dtc is for memcg domain */
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if (gdtc) {
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unsigned long global_avail = gdtc->avail;
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/*
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* The byte settings can't be applied directly to memcg
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* domains. Convert them to ratios by scaling against
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* globally available memory. As the ratios are in
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* per-PAGE_SIZE, they can be obtained by dividing bytes by
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* number of pages.
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*/
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if (bytes)
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ratio = min(DIV_ROUND_UP(bytes, global_avail),
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PAGE_SIZE);
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if (bg_bytes)
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bg_ratio = min(DIV_ROUND_UP(bg_bytes, global_avail),
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PAGE_SIZE);
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bytes = bg_bytes = 0;
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}
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if (bytes)
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thresh = DIV_ROUND_UP(bytes, PAGE_SIZE);
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else
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thresh = (ratio * available_memory) / PAGE_SIZE;
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if (bg_bytes)
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bg_thresh = DIV_ROUND_UP(bg_bytes, PAGE_SIZE);
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else
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bg_thresh = (bg_ratio * available_memory) / PAGE_SIZE;
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if (bg_thresh >= thresh)
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bg_thresh = thresh / 2;
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tsk = current;
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if (tsk->flags & PF_LESS_THROTTLE || rt_task(tsk)) {
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bg_thresh += bg_thresh / 4 + global_wb_domain.dirty_limit / 32;
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thresh += thresh / 4 + global_wb_domain.dirty_limit / 32;
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}
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dtc->thresh = thresh;
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dtc->bg_thresh = bg_thresh;
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/* we should eventually report the domain in the TP */
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if (!gdtc)
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trace_global_dirty_state(bg_thresh, thresh);
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}
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/**
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* global_dirty_limits - background-writeback and dirty-throttling thresholds
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* @pbackground: out parameter for bg_thresh
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* @pdirty: out parameter for thresh
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*
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* Calculate bg_thresh and thresh for global_wb_domain. See
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* domain_dirty_limits() for details.
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*/
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void global_dirty_limits(unsigned long *pbackground, unsigned long *pdirty)
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{
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struct dirty_throttle_control gdtc = { GDTC_INIT_NO_WB };
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gdtc.avail = global_dirtyable_memory();
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domain_dirty_limits(&gdtc);
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*pbackground = gdtc.bg_thresh;
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*pdirty = gdtc.thresh;
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}
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/**
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* node_dirty_limit - maximum number of dirty pages allowed in a node
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* @pgdat: the node
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*
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* Returns the maximum number of dirty pages allowed in a node, based
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* on the node's dirtyable memory.
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*/
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static unsigned long node_dirty_limit(struct pglist_data *pgdat)
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{
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unsigned long node_memory = node_dirtyable_memory(pgdat);
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struct task_struct *tsk = current;
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unsigned long dirty;
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if (vm_dirty_bytes)
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dirty = DIV_ROUND_UP(vm_dirty_bytes, PAGE_SIZE) *
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node_memory / global_dirtyable_memory();
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else
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dirty = vm_dirty_ratio * node_memory / 100;
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if (tsk->flags & PF_LESS_THROTTLE || rt_task(tsk))
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dirty += dirty / 4;
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return dirty;
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}
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/**
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* node_dirty_ok - tells whether a node is within its dirty limits
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* @pgdat: the node to check
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*
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* Returns %true when the dirty pages in @pgdat are within the node's
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* dirty limit, %false if the limit is exceeded.
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*/
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bool node_dirty_ok(struct pglist_data *pgdat)
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{
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unsigned long limit = node_dirty_limit(pgdat);
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unsigned long nr_pages = 0;
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nr_pages += node_page_state(pgdat, NR_FILE_DIRTY);
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nr_pages += node_page_state(pgdat, NR_UNSTABLE_NFS);
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nr_pages += node_page_state(pgdat, NR_WRITEBACK);
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return nr_pages <= limit;
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}
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int dirty_background_ratio_handler(struct ctl_table *table, int write,
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void __user *buffer, size_t *lenp,
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loff_t *ppos)
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{
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int ret;
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ret = proc_dointvec_minmax(table, write, buffer, lenp, ppos);
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if (ret == 0 && write)
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dirty_background_bytes = 0;
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return ret;
|
|
}
|
|
|
|
int dirty_background_bytes_handler(struct ctl_table *table, int write,
|
|
void __user *buffer, size_t *lenp,
|
|
loff_t *ppos)
|
|
{
|
|
int ret;
|
|
|
|
ret = proc_doulongvec_minmax(table, write, buffer, lenp, ppos);
|
|
if (ret == 0 && write)
|
|
dirty_background_ratio = 0;
|
|
return ret;
|
|
}
|
|
|
|
int dirty_ratio_handler(struct ctl_table *table, int write,
|
|
void __user *buffer, size_t *lenp,
|
|
loff_t *ppos)
|
|
{
|
|
int old_ratio = vm_dirty_ratio;
|
|
int ret;
|
|
|
|
ret = proc_dointvec_minmax(table, write, buffer, lenp, ppos);
|
|
if (ret == 0 && write && vm_dirty_ratio != old_ratio) {
|
|
writeback_set_ratelimit();
|
|
vm_dirty_bytes = 0;
|
|
}
|
|
return ret;
|
|
}
|
|
|
|
int dirty_bytes_handler(struct ctl_table *table, int write,
|
|
void __user *buffer, size_t *lenp,
|
|
loff_t *ppos)
|
|
{
|
|
unsigned long old_bytes = vm_dirty_bytes;
|
|
int ret;
|
|
|
|
ret = proc_doulongvec_minmax(table, write, buffer, lenp, ppos);
|
|
if (ret == 0 && write && vm_dirty_bytes != old_bytes) {
|
|
writeback_set_ratelimit();
|
|
vm_dirty_ratio = 0;
|
|
}
|
|
return ret;
|
|
}
|
|
|
|
static unsigned long wp_next_time(unsigned long cur_time)
|
|
{
|
|
cur_time += VM_COMPLETIONS_PERIOD_LEN;
|
|
/* 0 has a special meaning... */
|
|
if (!cur_time)
|
|
return 1;
|
|
return cur_time;
|
|
}
|
|
|
|
static void wb_domain_writeout_inc(struct wb_domain *dom,
|
|
struct fprop_local_percpu *completions,
|
|
unsigned int max_prop_frac)
|
|
{
|
|
__fprop_inc_percpu_max(&dom->completions, completions,
|
|
max_prop_frac);
|
|
/* First event after period switching was turned off? */
|
|
if (unlikely(!dom->period_time)) {
|
|
/*
|
|
* We can race with other __bdi_writeout_inc calls here but
|
|
* it does not cause any harm since the resulting time when
|
|
* timer will fire and what is in writeout_period_time will be
|
|
* roughly the same.
|
|
*/
|
|
dom->period_time = wp_next_time(jiffies);
|
|
mod_timer(&dom->period_timer, dom->period_time);
|
|
}
|
|
}
|
|
|
|
/*
|
|
* Increment @wb's writeout completion count and the global writeout
|
|
* completion count. Called from test_clear_page_writeback().
|
|
*/
|
|
static inline void __wb_writeout_inc(struct bdi_writeback *wb)
|
|
{
|
|
struct wb_domain *cgdom;
|
|
|
|
inc_wb_stat(wb, WB_WRITTEN);
|
|
wb_domain_writeout_inc(&global_wb_domain, &wb->completions,
|
|
wb->bdi->max_prop_frac);
|
|
|
|
cgdom = mem_cgroup_wb_domain(wb);
|
|
if (cgdom)
|
|
wb_domain_writeout_inc(cgdom, wb_memcg_completions(wb),
|
|
wb->bdi->max_prop_frac);
|
|
}
|
|
|
|
void wb_writeout_inc(struct bdi_writeback *wb)
|
|
{
|
|
unsigned long flags;
|
|
|
|
local_irq_save(flags);
|
|
__wb_writeout_inc(wb);
|
|
local_irq_restore(flags);
|
|
}
|
|
EXPORT_SYMBOL_GPL(wb_writeout_inc);
|
|
|
|
/*
|
|
* On idle system, we can be called long after we scheduled because we use
|
|
* deferred timers so count with missed periods.
|
|
*/
|
|
static void writeout_period(unsigned long t)
|
|
{
|
|
struct wb_domain *dom = (void *)t;
|
|
int miss_periods = (jiffies - dom->period_time) /
|
|
VM_COMPLETIONS_PERIOD_LEN;
|
|
|
|
if (fprop_new_period(&dom->completions, miss_periods + 1)) {
|
|
dom->period_time = wp_next_time(dom->period_time +
|
|
miss_periods * VM_COMPLETIONS_PERIOD_LEN);
|
|
mod_timer(&dom->period_timer, dom->period_time);
|
|
} else {
|
|
/*
|
|
* Aging has zeroed all fractions. Stop wasting CPU on period
|
|
* updates.
|
|
*/
|
|
dom->period_time = 0;
|
|
}
|
|
}
|
|
|
|
int wb_domain_init(struct wb_domain *dom, gfp_t gfp)
|
|
{
|
|
memset(dom, 0, sizeof(*dom));
|
|
|
|
spin_lock_init(&dom->lock);
|
|
|
|
setup_deferrable_timer(&dom->period_timer, writeout_period,
|
|
(unsigned long)dom);
|
|
|
|
dom->dirty_limit_tstamp = jiffies;
|
|
|
|
return fprop_global_init(&dom->completions, gfp);
|
|
}
|
|
|
|
#ifdef CONFIG_CGROUP_WRITEBACK
|
|
void wb_domain_exit(struct wb_domain *dom)
|
|
{
|
|
del_timer_sync(&dom->period_timer);
|
|
fprop_global_destroy(&dom->completions);
|
|
}
|
|
#endif
|
|
|
|
/*
|
|
* bdi_min_ratio keeps the sum of the minimum dirty shares of all
|
|
* registered backing devices, which, for obvious reasons, can not
|
|
* exceed 100%.
|
|
*/
|
|
static unsigned int bdi_min_ratio;
|
|
|
|
int bdi_set_min_ratio(struct backing_dev_info *bdi, unsigned int min_ratio)
|
|
{
|
|
int ret = 0;
|
|
|
|
spin_lock_bh(&bdi_lock);
|
|
if (min_ratio > bdi->max_ratio) {
|
|
ret = -EINVAL;
|
|
} else {
|
|
min_ratio -= bdi->min_ratio;
|
|
if (bdi_min_ratio + min_ratio < 100) {
|
|
bdi_min_ratio += min_ratio;
|
|
bdi->min_ratio += min_ratio;
|
|
} else {
|
|
ret = -EINVAL;
|
|
}
|
|
}
|
|
spin_unlock_bh(&bdi_lock);
|
|
|
|
return ret;
|
|
}
|
|
|
|
int bdi_set_max_ratio(struct backing_dev_info *bdi, unsigned max_ratio)
|
|
{
|
|
int ret = 0;
|
|
|
|
if (max_ratio > 100)
|
|
return -EINVAL;
|
|
|
|
spin_lock_bh(&bdi_lock);
|
|
if (bdi->min_ratio > max_ratio) {
|
|
ret = -EINVAL;
|
|
} else {
|
|
bdi->max_ratio = max_ratio;
|
|
bdi->max_prop_frac = (FPROP_FRAC_BASE * max_ratio) / 100;
|
|
}
|
|
spin_unlock_bh(&bdi_lock);
|
|
|
|
return ret;
|
|
}
|
|
EXPORT_SYMBOL(bdi_set_max_ratio);
|
|
|
|
static unsigned long dirty_freerun_ceiling(unsigned long thresh,
|
|
unsigned long bg_thresh)
|
|
{
|
|
return (thresh + bg_thresh) / 2;
|
|
}
|
|
|
|
static unsigned long hard_dirty_limit(struct wb_domain *dom,
|
|
unsigned long thresh)
|
|
{
|
|
return max(thresh, dom->dirty_limit);
|
|
}
|
|
|
|
/*
|
|
* Memory which can be further allocated to a memcg domain is capped by
|
|
* system-wide clean memory excluding the amount being used in the domain.
|
|
*/
|
|
static void mdtc_calc_avail(struct dirty_throttle_control *mdtc,
|
|
unsigned long filepages, unsigned long headroom)
|
|
{
|
|
struct dirty_throttle_control *gdtc = mdtc_gdtc(mdtc);
|
|
unsigned long clean = filepages - min(filepages, mdtc->dirty);
|
|
unsigned long global_clean = gdtc->avail - min(gdtc->avail, gdtc->dirty);
|
|
unsigned long other_clean = global_clean - min(global_clean, clean);
|
|
|
|
mdtc->avail = filepages + min(headroom, other_clean);
|
|
}
|
|
|
|
/**
|
|
* __wb_calc_thresh - @wb's share of dirty throttling threshold
|
|
* @dtc: dirty_throttle_context of interest
|
|
*
|
|
* Returns @wb's dirty limit in pages. The term "dirty" in the context of
|
|
* dirty balancing includes all PG_dirty, PG_writeback and NFS unstable pages.
|
|
*
|
|
* Note that balance_dirty_pages() will only seriously take it as a hard limit
|
|
* when sleeping max_pause per page is not enough to keep the dirty pages under
|
|
* control. For example, when the device is completely stalled due to some error
|
|
* conditions, or when there are 1000 dd tasks writing to a slow 10MB/s USB key.
|
|
* In the other normal situations, it acts more gently by throttling the tasks
|
|
* more (rather than completely block them) when the wb dirty pages go high.
|
|
*
|
|
* It allocates high/low dirty limits to fast/slow devices, in order to prevent
|
|
* - starving fast devices
|
|
* - piling up dirty pages (that will take long time to sync) on slow devices
|
|
*
|
|
* The wb's share of dirty limit will be adapting to its throughput and
|
|
* bounded by the bdi->min_ratio and/or bdi->max_ratio parameters, if set.
|
|
*/
|
|
static unsigned long __wb_calc_thresh(struct dirty_throttle_control *dtc)
|
|
{
|
|
struct wb_domain *dom = dtc_dom(dtc);
|
|
unsigned long thresh = dtc->thresh;
|
|
u64 wb_thresh;
|
|
long numerator, denominator;
|
|
unsigned long wb_min_ratio, wb_max_ratio;
|
|
|
|
/*
|
|
* Calculate this BDI's share of the thresh ratio.
|
|
*/
|
|
fprop_fraction_percpu(&dom->completions, dtc->wb_completions,
|
|
&numerator, &denominator);
|
|
|
|
wb_thresh = (thresh * (100 - bdi_min_ratio)) / 100;
|
|
wb_thresh *= numerator;
|
|
do_div(wb_thresh, denominator);
|
|
|
|
wb_min_max_ratio(dtc->wb, &wb_min_ratio, &wb_max_ratio);
|
|
|
|
wb_thresh += (thresh * wb_min_ratio) / 100;
|
|
if (wb_thresh > (thresh * wb_max_ratio) / 100)
|
|
wb_thresh = thresh * wb_max_ratio / 100;
|
|
|
|
return wb_thresh;
|
|
}
|
|
|
|
unsigned long wb_calc_thresh(struct bdi_writeback *wb, unsigned long thresh)
|
|
{
|
|
struct dirty_throttle_control gdtc = { GDTC_INIT(wb),
|
|
.thresh = thresh };
|
|
return __wb_calc_thresh(&gdtc);
|
|
}
|
|
|
|
/*
|
|
* setpoint - dirty 3
|
|
* f(dirty) := 1.0 + (----------------)
|
|
* limit - setpoint
|
|
*
|
|
* it's a 3rd order polynomial that subjects to
|
|
*
|
|
* (1) f(freerun) = 2.0 => rampup dirty_ratelimit reasonably fast
|
|
* (2) f(setpoint) = 1.0 => the balance point
|
|
* (3) f(limit) = 0 => the hard limit
|
|
* (4) df/dx <= 0 => negative feedback control
|
|
* (5) the closer to setpoint, the smaller |df/dx| (and the reverse)
|
|
* => fast response on large errors; small oscillation near setpoint
|
|
*/
|
|
static long long pos_ratio_polynom(unsigned long setpoint,
|
|
unsigned long dirty,
|
|
unsigned long limit)
|
|
{
|
|
long long pos_ratio;
|
|
long x;
|
|
|
|
x = div64_s64(((s64)setpoint - (s64)dirty) << RATELIMIT_CALC_SHIFT,
|
|
(limit - setpoint) | 1);
|
|
pos_ratio = x;
|
|
pos_ratio = pos_ratio * x >> RATELIMIT_CALC_SHIFT;
|
|
pos_ratio = pos_ratio * x >> RATELIMIT_CALC_SHIFT;
|
|
pos_ratio += 1 << RATELIMIT_CALC_SHIFT;
|
|
|
|
return clamp(pos_ratio, 0LL, 2LL << RATELIMIT_CALC_SHIFT);
|
|
}
|
|
|
|
/*
|
|
* Dirty position control.
|
|
*
|
|
* (o) global/bdi setpoints
|
|
*
|
|
* We want the dirty pages be balanced around the global/wb setpoints.
|
|
* When the number of dirty pages is higher/lower than the setpoint, the
|
|
* dirty position control ratio (and hence task dirty ratelimit) will be
|
|
* decreased/increased to bring the dirty pages back to the setpoint.
|
|
*
|
|
* pos_ratio = 1 << RATELIMIT_CALC_SHIFT
|
|
*
|
|
* if (dirty < setpoint) scale up pos_ratio
|
|
* if (dirty > setpoint) scale down pos_ratio
|
|
*
|
|
* if (wb_dirty < wb_setpoint) scale up pos_ratio
|
|
* if (wb_dirty > wb_setpoint) scale down pos_ratio
|
|
*
|
|
* task_ratelimit = dirty_ratelimit * pos_ratio >> RATELIMIT_CALC_SHIFT
|
|
*
|
|
* (o) global control line
|
|
*
|
|
* ^ pos_ratio
|
|
* |
|
|
* | |<===== global dirty control scope ======>|
|
|
* 2.0 .............*
|
|
* | .*
|
|
* | . *
|
|
* | . *
|
|
* | . *
|
|
* | . *
|
|
* | . *
|
|
* 1.0 ................................*
|
|
* | . . *
|
|
* | . . *
|
|
* | . . *
|
|
* | . . *
|
|
* | . . *
|
|
* 0 +------------.------------------.----------------------*------------->
|
|
* freerun^ setpoint^ limit^ dirty pages
|
|
*
|
|
* (o) wb control line
|
|
*
|
|
* ^ pos_ratio
|
|
* |
|
|
* | *
|
|
* | *
|
|
* | *
|
|
* | *
|
|
* | * |<=========== span ============>|
|
|
* 1.0 .......................*
|
|
* | . *
|
|
* | . *
|
|
* | . *
|
|
* | . *
|
|
* | . *
|
|
* | . *
|
|
* | . *
|
|
* | . *
|
|
* | . *
|
|
* | . *
|
|
* | . *
|
|
* 1/4 ...............................................* * * * * * * * * * * *
|
|
* | . .
|
|
* | . .
|
|
* | . .
|
|
* 0 +----------------------.-------------------------------.------------->
|
|
* wb_setpoint^ x_intercept^
|
|
*
|
|
* The wb control line won't drop below pos_ratio=1/4, so that wb_dirty can
|
|
* be smoothly throttled down to normal if it starts high in situations like
|
|
* - start writing to a slow SD card and a fast disk at the same time. The SD
|
|
* card's wb_dirty may rush to many times higher than wb_setpoint.
|
|
* - the wb dirty thresh drops quickly due to change of JBOD workload
|
|
*/
|
|
static void wb_position_ratio(struct dirty_throttle_control *dtc)
|
|
{
|
|
struct bdi_writeback *wb = dtc->wb;
|
|
unsigned long write_bw = wb->avg_write_bandwidth;
|
|
unsigned long freerun = dirty_freerun_ceiling(dtc->thresh, dtc->bg_thresh);
|
|
unsigned long limit = hard_dirty_limit(dtc_dom(dtc), dtc->thresh);
|
|
unsigned long wb_thresh = dtc->wb_thresh;
|
|
unsigned long x_intercept;
|
|
unsigned long setpoint; /* dirty pages' target balance point */
|
|
unsigned long wb_setpoint;
|
|
unsigned long span;
|
|
long long pos_ratio; /* for scaling up/down the rate limit */
|
|
long x;
|
|
|
|
dtc->pos_ratio = 0;
|
|
|
|
if (unlikely(dtc->dirty >= limit))
|
|
return;
|
|
|
|
/*
|
|
* global setpoint
|
|
*
|
|
* See comment for pos_ratio_polynom().
|
|
*/
|
|
setpoint = (freerun + limit) / 2;
|
|
pos_ratio = pos_ratio_polynom(setpoint, dtc->dirty, limit);
|
|
|
|
/*
|
|
* The strictlimit feature is a tool preventing mistrusted filesystems
|
|
* from growing a large number of dirty pages before throttling. For
|
|
* such filesystems balance_dirty_pages always checks wb counters
|
|
* against wb limits. Even if global "nr_dirty" is under "freerun".
|
|
* This is especially important for fuse which sets bdi->max_ratio to
|
|
* 1% by default. Without strictlimit feature, fuse writeback may
|
|
* consume arbitrary amount of RAM because it is accounted in
|
|
* NR_WRITEBACK_TEMP which is not involved in calculating "nr_dirty".
|
|
*
|
|
* Here, in wb_position_ratio(), we calculate pos_ratio based on
|
|
* two values: wb_dirty and wb_thresh. Let's consider an example:
|
|
* total amount of RAM is 16GB, bdi->max_ratio is equal to 1%, global
|
|
* limits are set by default to 10% and 20% (background and throttle).
|
|
* Then wb_thresh is 1% of 20% of 16GB. This amounts to ~8K pages.
|
|
* wb_calc_thresh(wb, bg_thresh) is about ~4K pages. wb_setpoint is
|
|
* about ~6K pages (as the average of background and throttle wb
|
|
* limits). The 3rd order polynomial will provide positive feedback if
|
|
* wb_dirty is under wb_setpoint and vice versa.
|
|
*
|
|
* Note, that we cannot use global counters in these calculations
|
|
* because we want to throttle process writing to a strictlimit wb
|
|
* much earlier than global "freerun" is reached (~23MB vs. ~2.3GB
|
|
* in the example above).
|
|
*/
|
|
if (unlikely(wb->bdi->capabilities & BDI_CAP_STRICTLIMIT)) {
|
|
long long wb_pos_ratio;
|
|
|
|
if (dtc->wb_dirty < 8) {
|
|
dtc->pos_ratio = min_t(long long, pos_ratio * 2,
|
|
2 << RATELIMIT_CALC_SHIFT);
|
|
return;
|
|
}
|
|
|
|
if (dtc->wb_dirty >= wb_thresh)
|
|
return;
|
|
|
|
wb_setpoint = dirty_freerun_ceiling(wb_thresh,
|
|
dtc->wb_bg_thresh);
|
|
|
|
if (wb_setpoint == 0 || wb_setpoint == wb_thresh)
|
|
return;
|
|
|
|
wb_pos_ratio = pos_ratio_polynom(wb_setpoint, dtc->wb_dirty,
|
|
wb_thresh);
|
|
|
|
/*
|
|
* Typically, for strictlimit case, wb_setpoint << setpoint
|
|
* and pos_ratio >> wb_pos_ratio. In the other words global
|
|
* state ("dirty") is not limiting factor and we have to
|
|
* make decision based on wb counters. But there is an
|
|
* important case when global pos_ratio should get precedence:
|
|
* global limits are exceeded (e.g. due to activities on other
|
|
* wb's) while given strictlimit wb is below limit.
|
|
*
|
|
* "pos_ratio * wb_pos_ratio" would work for the case above,
|
|
* but it would look too non-natural for the case of all
|
|
* activity in the system coming from a single strictlimit wb
|
|
* with bdi->max_ratio == 100%.
|
|
*
|
|
* Note that min() below somewhat changes the dynamics of the
|
|
* control system. Normally, pos_ratio value can be well over 3
|
|
* (when globally we are at freerun and wb is well below wb
|
|
* setpoint). Now the maximum pos_ratio in the same situation
|
|
* is 2. We might want to tweak this if we observe the control
|
|
* system is too slow to adapt.
|
|
*/
|
|
dtc->pos_ratio = min(pos_ratio, wb_pos_ratio);
|
|
return;
|
|
}
|
|
|
|
/*
|
|
* We have computed basic pos_ratio above based on global situation. If
|
|
* the wb is over/under its share of dirty pages, we want to scale
|
|
* pos_ratio further down/up. That is done by the following mechanism.
|
|
*/
|
|
|
|
/*
|
|
* wb setpoint
|
|
*
|
|
* f(wb_dirty) := 1.0 + k * (wb_dirty - wb_setpoint)
|
|
*
|
|
* x_intercept - wb_dirty
|
|
* := --------------------------
|
|
* x_intercept - wb_setpoint
|
|
*
|
|
* The main wb control line is a linear function that subjects to
|
|
*
|
|
* (1) f(wb_setpoint) = 1.0
|
|
* (2) k = - 1 / (8 * write_bw) (in single wb case)
|
|
* or equally: x_intercept = wb_setpoint + 8 * write_bw
|
|
*
|
|
* For single wb case, the dirty pages are observed to fluctuate
|
|
* regularly within range
|
|
* [wb_setpoint - write_bw/2, wb_setpoint + write_bw/2]
|
|
* for various filesystems, where (2) can yield in a reasonable 12.5%
|
|
* fluctuation range for pos_ratio.
|
|
*
|
|
* For JBOD case, wb_thresh (not wb_dirty!) could fluctuate up to its
|
|
* own size, so move the slope over accordingly and choose a slope that
|
|
* yields 100% pos_ratio fluctuation on suddenly doubled wb_thresh.
|
|
*/
|
|
if (unlikely(wb_thresh > dtc->thresh))
|
|
wb_thresh = dtc->thresh;
|
|
/*
|
|
* It's very possible that wb_thresh is close to 0 not because the
|
|
* device is slow, but that it has remained inactive for long time.
|
|
* Honour such devices a reasonable good (hopefully IO efficient)
|
|
* threshold, so that the occasional writes won't be blocked and active
|
|
* writes can rampup the threshold quickly.
|
|
*/
|
|
wb_thresh = max(wb_thresh, (limit - dtc->dirty) / 8);
|
|
/*
|
|
* scale global setpoint to wb's:
|
|
* wb_setpoint = setpoint * wb_thresh / thresh
|
|
*/
|
|
x = div_u64((u64)wb_thresh << 16, dtc->thresh | 1);
|
|
wb_setpoint = setpoint * (u64)x >> 16;
|
|
/*
|
|
* Use span=(8*write_bw) in single wb case as indicated by
|
|
* (thresh - wb_thresh ~= 0) and transit to wb_thresh in JBOD case.
|
|
*
|
|
* wb_thresh thresh - wb_thresh
|
|
* span = --------- * (8 * write_bw) + ------------------ * wb_thresh
|
|
* thresh thresh
|
|
*/
|
|
span = (dtc->thresh - wb_thresh + 8 * write_bw) * (u64)x >> 16;
|
|
x_intercept = wb_setpoint + span;
|
|
|
|
if (dtc->wb_dirty < x_intercept - span / 4) {
|
|
pos_ratio = div64_u64(pos_ratio * (x_intercept - dtc->wb_dirty),
|
|
(x_intercept - wb_setpoint) | 1);
|
|
} else
|
|
pos_ratio /= 4;
|
|
|
|
/*
|
|
* wb reserve area, safeguard against dirty pool underrun and disk idle
|
|
* It may push the desired control point of global dirty pages higher
|
|
* than setpoint.
|
|
*/
|
|
x_intercept = wb_thresh / 2;
|
|
if (dtc->wb_dirty < x_intercept) {
|
|
if (dtc->wb_dirty > x_intercept / 8)
|
|
pos_ratio = div_u64(pos_ratio * x_intercept,
|
|
dtc->wb_dirty);
|
|
else
|
|
pos_ratio *= 8;
|
|
}
|
|
|
|
dtc->pos_ratio = pos_ratio;
|
|
}
|
|
|
|
static void wb_update_write_bandwidth(struct bdi_writeback *wb,
|
|
unsigned long elapsed,
|
|
unsigned long written)
|
|
{
|
|
const unsigned long period = roundup_pow_of_two(3 * HZ);
|
|
unsigned long avg = wb->avg_write_bandwidth;
|
|
unsigned long old = wb->write_bandwidth;
|
|
u64 bw;
|
|
|
|
/*
|
|
* bw = written * HZ / elapsed
|
|
*
|
|
* bw * elapsed + write_bandwidth * (period - elapsed)
|
|
* write_bandwidth = ---------------------------------------------------
|
|
* period
|
|
*
|
|
* @written may have decreased due to account_page_redirty().
|
|
* Avoid underflowing @bw calculation.
|
|
*/
|
|
bw = written - min(written, wb->written_stamp);
|
|
bw *= HZ;
|
|
if (unlikely(elapsed > period)) {
|
|
do_div(bw, elapsed);
|
|
avg = bw;
|
|
goto out;
|
|
}
|
|
bw += (u64)wb->write_bandwidth * (period - elapsed);
|
|
bw >>= ilog2(period);
|
|
|
|
/*
|
|
* one more level of smoothing, for filtering out sudden spikes
|
|
*/
|
|
if (avg > old && old >= (unsigned long)bw)
|
|
avg -= (avg - old) >> 3;
|
|
|
|
if (avg < old && old <= (unsigned long)bw)
|
|
avg += (old - avg) >> 3;
|
|
|
|
out:
|
|
/* keep avg > 0 to guarantee that tot > 0 if there are dirty wbs */
|
|
avg = max(avg, 1LU);
|
|
if (wb_has_dirty_io(wb)) {
|
|
long delta = avg - wb->avg_write_bandwidth;
|
|
WARN_ON_ONCE(atomic_long_add_return(delta,
|
|
&wb->bdi->tot_write_bandwidth) <= 0);
|
|
}
|
|
wb->write_bandwidth = bw;
|
|
wb->avg_write_bandwidth = avg;
|
|
}
|
|
|
|
static void update_dirty_limit(struct dirty_throttle_control *dtc)
|
|
{
|
|
struct wb_domain *dom = dtc_dom(dtc);
|
|
unsigned long thresh = dtc->thresh;
|
|
unsigned long limit = dom->dirty_limit;
|
|
|
|
/*
|
|
* Follow up in one step.
|
|
*/
|
|
if (limit < thresh) {
|
|
limit = thresh;
|
|
goto update;
|
|
}
|
|
|
|
/*
|
|
* Follow down slowly. Use the higher one as the target, because thresh
|
|
* may drop below dirty. This is exactly the reason to introduce
|
|
* dom->dirty_limit which is guaranteed to lie above the dirty pages.
|
|
*/
|
|
thresh = max(thresh, dtc->dirty);
|
|
if (limit > thresh) {
|
|
limit -= (limit - thresh) >> 5;
|
|
goto update;
|
|
}
|
|
return;
|
|
update:
|
|
dom->dirty_limit = limit;
|
|
}
|
|
|
|
static void domain_update_bandwidth(struct dirty_throttle_control *dtc,
|
|
unsigned long now)
|
|
{
|
|
struct wb_domain *dom = dtc_dom(dtc);
|
|
|
|
/*
|
|
* check locklessly first to optimize away locking for the most time
|
|
*/
|
|
if (time_before(now, dom->dirty_limit_tstamp + BANDWIDTH_INTERVAL))
|
|
return;
|
|
|
|
spin_lock(&dom->lock);
|
|
if (time_after_eq(now, dom->dirty_limit_tstamp + BANDWIDTH_INTERVAL)) {
|
|
update_dirty_limit(dtc);
|
|
dom->dirty_limit_tstamp = now;
|
|
}
|
|
spin_unlock(&dom->lock);
|
|
}
|
|
|
|
/*
|
|
* Maintain wb->dirty_ratelimit, the base dirty throttle rate.
|
|
*
|
|
* Normal wb tasks will be curbed at or below it in long term.
|
|
* Obviously it should be around (write_bw / N) when there are N dd tasks.
|
|
*/
|
|
static void wb_update_dirty_ratelimit(struct dirty_throttle_control *dtc,
|
|
unsigned long dirtied,
|
|
unsigned long elapsed)
|
|
{
|
|
struct bdi_writeback *wb = dtc->wb;
|
|
unsigned long dirty = dtc->dirty;
|
|
unsigned long freerun = dirty_freerun_ceiling(dtc->thresh, dtc->bg_thresh);
|
|
unsigned long limit = hard_dirty_limit(dtc_dom(dtc), dtc->thresh);
|
|
unsigned long setpoint = (freerun + limit) / 2;
|
|
unsigned long write_bw = wb->avg_write_bandwidth;
|
|
unsigned long dirty_ratelimit = wb->dirty_ratelimit;
|
|
unsigned long dirty_rate;
|
|
unsigned long task_ratelimit;
|
|
unsigned long balanced_dirty_ratelimit;
|
|
unsigned long step;
|
|
unsigned long x;
|
|
unsigned long shift;
|
|
|
|
/*
|
|
* The dirty rate will match the writeout rate in long term, except
|
|
* when dirty pages are truncated by userspace or re-dirtied by FS.
|
|
*/
|
|
dirty_rate = (dirtied - wb->dirtied_stamp) * HZ / elapsed;
|
|
|
|
/*
|
|
* task_ratelimit reflects each dd's dirty rate for the past 200ms.
|
|
*/
|
|
task_ratelimit = (u64)dirty_ratelimit *
|
|
dtc->pos_ratio >> RATELIMIT_CALC_SHIFT;
|
|
task_ratelimit++; /* it helps rampup dirty_ratelimit from tiny values */
|
|
|
|
/*
|
|
* A linear estimation of the "balanced" throttle rate. The theory is,
|
|
* if there are N dd tasks, each throttled at task_ratelimit, the wb's
|
|
* dirty_rate will be measured to be (N * task_ratelimit). So the below
|
|
* formula will yield the balanced rate limit (write_bw / N).
|
|
*
|
|
* Note that the expanded form is not a pure rate feedback:
|
|
* rate_(i+1) = rate_(i) * (write_bw / dirty_rate) (1)
|
|
* but also takes pos_ratio into account:
|
|
* rate_(i+1) = rate_(i) * (write_bw / dirty_rate) * pos_ratio (2)
|
|
*
|
|
* (1) is not realistic because pos_ratio also takes part in balancing
|
|
* the dirty rate. Consider the state
|
|
* pos_ratio = 0.5 (3)
|
|
* rate = 2 * (write_bw / N) (4)
|
|
* If (1) is used, it will stuck in that state! Because each dd will
|
|
* be throttled at
|
|
* task_ratelimit = pos_ratio * rate = (write_bw / N) (5)
|
|
* yielding
|
|
* dirty_rate = N * task_ratelimit = write_bw (6)
|
|
* put (6) into (1) we get
|
|
* rate_(i+1) = rate_(i) (7)
|
|
*
|
|
* So we end up using (2) to always keep
|
|
* rate_(i+1) ~= (write_bw / N) (8)
|
|
* regardless of the value of pos_ratio. As long as (8) is satisfied,
|
|
* pos_ratio is able to drive itself to 1.0, which is not only where
|
|
* the dirty count meet the setpoint, but also where the slope of
|
|
* pos_ratio is most flat and hence task_ratelimit is least fluctuated.
|
|
*/
|
|
balanced_dirty_ratelimit = div_u64((u64)task_ratelimit * write_bw,
|
|
dirty_rate | 1);
|
|
/*
|
|
* balanced_dirty_ratelimit ~= (write_bw / N) <= write_bw
|
|
*/
|
|
if (unlikely(balanced_dirty_ratelimit > write_bw))
|
|
balanced_dirty_ratelimit = write_bw;
|
|
|
|
/*
|
|
* We could safely do this and return immediately:
|
|
*
|
|
* wb->dirty_ratelimit = balanced_dirty_ratelimit;
|
|
*
|
|
* However to get a more stable dirty_ratelimit, the below elaborated
|
|
* code makes use of task_ratelimit to filter out singular points and
|
|
* limit the step size.
|
|
*
|
|
* The below code essentially only uses the relative value of
|
|
*
|
|
* task_ratelimit - dirty_ratelimit
|
|
* = (pos_ratio - 1) * dirty_ratelimit
|
|
*
|
|
* which reflects the direction and size of dirty position error.
|
|
*/
|
|
|
|
/*
|
|
* dirty_ratelimit will follow balanced_dirty_ratelimit iff
|
|
* task_ratelimit is on the same side of dirty_ratelimit, too.
|
|
* For example, when
|
|
* - dirty_ratelimit > balanced_dirty_ratelimit
|
|
* - dirty_ratelimit > task_ratelimit (dirty pages are above setpoint)
|
|
* lowering dirty_ratelimit will help meet both the position and rate
|
|
* control targets. Otherwise, don't update dirty_ratelimit if it will
|
|
* only help meet the rate target. After all, what the users ultimately
|
|
* feel and care are stable dirty rate and small position error.
|
|
*
|
|
* |task_ratelimit - dirty_ratelimit| is used to limit the step size
|
|
* and filter out the singular points of balanced_dirty_ratelimit. Which
|
|
* keeps jumping around randomly and can even leap far away at times
|
|
* due to the small 200ms estimation period of dirty_rate (we want to
|
|
* keep that period small to reduce time lags).
|
|
*/
|
|
step = 0;
|
|
|
|
/*
|
|
* For strictlimit case, calculations above were based on wb counters
|
|
* and limits (starting from pos_ratio = wb_position_ratio() and up to
|
|
* balanced_dirty_ratelimit = task_ratelimit * write_bw / dirty_rate).
|
|
* Hence, to calculate "step" properly, we have to use wb_dirty as
|
|
* "dirty" and wb_setpoint as "setpoint".
|
|
*
|
|
* We rampup dirty_ratelimit forcibly if wb_dirty is low because
|
|
* it's possible that wb_thresh is close to zero due to inactivity
|
|
* of backing device.
|
|
*/
|
|
if (unlikely(wb->bdi->capabilities & BDI_CAP_STRICTLIMIT)) {
|
|
dirty = dtc->wb_dirty;
|
|
if (dtc->wb_dirty < 8)
|
|
setpoint = dtc->wb_dirty + 1;
|
|
else
|
|
setpoint = (dtc->wb_thresh + dtc->wb_bg_thresh) / 2;
|
|
}
|
|
|
|
if (dirty < setpoint) {
|
|
x = min3(wb->balanced_dirty_ratelimit,
|
|
balanced_dirty_ratelimit, task_ratelimit);
|
|
if (dirty_ratelimit < x)
|
|
step = x - dirty_ratelimit;
|
|
} else {
|
|
x = max3(wb->balanced_dirty_ratelimit,
|
|
balanced_dirty_ratelimit, task_ratelimit);
|
|
if (dirty_ratelimit > x)
|
|
step = dirty_ratelimit - x;
|
|
}
|
|
|
|
/*
|
|
* Don't pursue 100% rate matching. It's impossible since the balanced
|
|
* rate itself is constantly fluctuating. So decrease the track speed
|
|
* when it gets close to the target. Helps eliminate pointless tremors.
|
|
*/
|
|
shift = dirty_ratelimit / (2 * step + 1);
|
|
if (shift < BITS_PER_LONG)
|
|
step = DIV_ROUND_UP(step >> shift, 8);
|
|
else
|
|
step = 0;
|
|
|
|
if (dirty_ratelimit < balanced_dirty_ratelimit)
|
|
dirty_ratelimit += step;
|
|
else
|
|
dirty_ratelimit -= step;
|
|
|
|
wb->dirty_ratelimit = max(dirty_ratelimit, 1UL);
|
|
wb->balanced_dirty_ratelimit = balanced_dirty_ratelimit;
|
|
|
|
trace_bdi_dirty_ratelimit(wb, dirty_rate, task_ratelimit);
|
|
}
|
|
|
|
static void __wb_update_bandwidth(struct dirty_throttle_control *gdtc,
|
|
struct dirty_throttle_control *mdtc,
|
|
unsigned long start_time,
|
|
bool update_ratelimit)
|
|
{
|
|
struct bdi_writeback *wb = gdtc->wb;
|
|
unsigned long now = jiffies;
|
|
unsigned long elapsed = now - wb->bw_time_stamp;
|
|
unsigned long dirtied;
|
|
unsigned long written;
|
|
|
|
lockdep_assert_held(&wb->list_lock);
|
|
|
|
/*
|
|
* rate-limit, only update once every 200ms.
|
|
*/
|
|
if (elapsed < BANDWIDTH_INTERVAL)
|
|
return;
|
|
|
|
dirtied = percpu_counter_read(&wb->stat[WB_DIRTIED]);
|
|
written = percpu_counter_read(&wb->stat[WB_WRITTEN]);
|
|
|
|
/*
|
|
* Skip quiet periods when disk bandwidth is under-utilized.
|
|
* (at least 1s idle time between two flusher runs)
|
|
*/
|
|
if (elapsed > HZ && time_before(wb->bw_time_stamp, start_time))
|
|
goto snapshot;
|
|
|
|
if (update_ratelimit) {
|
|
domain_update_bandwidth(gdtc, now);
|
|
wb_update_dirty_ratelimit(gdtc, dirtied, elapsed);
|
|
|
|
/*
|
|
* @mdtc is always NULL if !CGROUP_WRITEBACK but the
|
|
* compiler has no way to figure that out. Help it.
|
|
*/
|
|
if (IS_ENABLED(CONFIG_CGROUP_WRITEBACK) && mdtc) {
|
|
domain_update_bandwidth(mdtc, now);
|
|
wb_update_dirty_ratelimit(mdtc, dirtied, elapsed);
|
|
}
|
|
}
|
|
wb_update_write_bandwidth(wb, elapsed, written);
|
|
|
|
snapshot:
|
|
wb->dirtied_stamp = dirtied;
|
|
wb->written_stamp = written;
|
|
wb->bw_time_stamp = now;
|
|
}
|
|
|
|
void wb_update_bandwidth(struct bdi_writeback *wb, unsigned long start_time)
|
|
{
|
|
struct dirty_throttle_control gdtc = { GDTC_INIT(wb) };
|
|
|
|
__wb_update_bandwidth(&gdtc, NULL, start_time, false);
|
|
}
|
|
|
|
/*
|
|
* After a task dirtied this many pages, balance_dirty_pages_ratelimited()
|
|
* will look to see if it needs to start dirty throttling.
|
|
*
|
|
* If dirty_poll_interval is too low, big NUMA machines will call the expensive
|
|
* global_zone_page_state() too often. So scale it near-sqrt to the safety margin
|
|
* (the number of pages we may dirty without exceeding the dirty limits).
|
|
*/
|
|
static unsigned long dirty_poll_interval(unsigned long dirty,
|
|
unsigned long thresh)
|
|
{
|
|
if (thresh > dirty)
|
|
return 1UL << (ilog2(thresh - dirty) >> 1);
|
|
|
|
return 1;
|
|
}
|
|
|
|
static unsigned long wb_max_pause(struct bdi_writeback *wb,
|
|
unsigned long wb_dirty)
|
|
{
|
|
unsigned long bw = wb->avg_write_bandwidth;
|
|
unsigned long t;
|
|
|
|
/*
|
|
* Limit pause time for small memory systems. If sleeping for too long
|
|
* time, a small pool of dirty/writeback pages may go empty and disk go
|
|
* idle.
|
|
*
|
|
* 8 serves as the safety ratio.
|
|
*/
|
|
t = wb_dirty / (1 + bw / roundup_pow_of_two(1 + HZ / 8));
|
|
t++;
|
|
|
|
return min_t(unsigned long, t, MAX_PAUSE);
|
|
}
|
|
|
|
static long wb_min_pause(struct bdi_writeback *wb,
|
|
long max_pause,
|
|
unsigned long task_ratelimit,
|
|
unsigned long dirty_ratelimit,
|
|
int *nr_dirtied_pause)
|
|
{
|
|
long hi = ilog2(wb->avg_write_bandwidth);
|
|
long lo = ilog2(wb->dirty_ratelimit);
|
|
long t; /* target pause */
|
|
long pause; /* estimated next pause */
|
|
int pages; /* target nr_dirtied_pause */
|
|
|
|
/* target for 10ms pause on 1-dd case */
|
|
t = max(1, HZ / 100);
|
|
|
|
/*
|
|
* Scale up pause time for concurrent dirtiers in order to reduce CPU
|
|
* overheads.
|
|
*
|
|
* (N * 10ms) on 2^N concurrent tasks.
|
|
*/
|
|
if (hi > lo)
|
|
t += (hi - lo) * (10 * HZ) / 1024;
|
|
|
|
/*
|
|
* This is a bit convoluted. We try to base the next nr_dirtied_pause
|
|
* on the much more stable dirty_ratelimit. However the next pause time
|
|
* will be computed based on task_ratelimit and the two rate limits may
|
|
* depart considerably at some time. Especially if task_ratelimit goes
|
|
* below dirty_ratelimit/2 and the target pause is max_pause, the next
|
|
* pause time will be max_pause*2 _trimmed down_ to max_pause. As a
|
|
* result task_ratelimit won't be executed faithfully, which could
|
|
* eventually bring down dirty_ratelimit.
|
|
*
|
|
* We apply two rules to fix it up:
|
|
* 1) try to estimate the next pause time and if necessary, use a lower
|
|
* nr_dirtied_pause so as not to exceed max_pause. When this happens,
|
|
* nr_dirtied_pause will be "dancing" with task_ratelimit.
|
|
* 2) limit the target pause time to max_pause/2, so that the normal
|
|
* small fluctuations of task_ratelimit won't trigger rule (1) and
|
|
* nr_dirtied_pause will remain as stable as dirty_ratelimit.
|
|
*/
|
|
t = min(t, 1 + max_pause / 2);
|
|
pages = dirty_ratelimit * t / roundup_pow_of_two(HZ);
|
|
|
|
/*
|
|
* Tiny nr_dirtied_pause is found to hurt I/O performance in the test
|
|
* case fio-mmap-randwrite-64k, which does 16*{sync read, async write}.
|
|
* When the 16 consecutive reads are often interrupted by some dirty
|
|
* throttling pause during the async writes, cfq will go into idles
|
|
* (deadline is fine). So push nr_dirtied_pause as high as possible
|
|
* until reaches DIRTY_POLL_THRESH=32 pages.
|
|
*/
|
|
if (pages < DIRTY_POLL_THRESH) {
|
|
t = max_pause;
|
|
pages = dirty_ratelimit * t / roundup_pow_of_two(HZ);
|
|
if (pages > DIRTY_POLL_THRESH) {
|
|
pages = DIRTY_POLL_THRESH;
|
|
t = HZ * DIRTY_POLL_THRESH / dirty_ratelimit;
|
|
}
|
|
}
|
|
|
|
pause = HZ * pages / (task_ratelimit + 1);
|
|
if (pause > max_pause) {
|
|
t = max_pause;
|
|
pages = task_ratelimit * t / roundup_pow_of_two(HZ);
|
|
}
|
|
|
|
*nr_dirtied_pause = pages;
|
|
/*
|
|
* The minimal pause time will normally be half the target pause time.
|
|
*/
|
|
return pages >= DIRTY_POLL_THRESH ? 1 + t / 2 : t;
|
|
}
|
|
|
|
static inline void wb_dirty_limits(struct dirty_throttle_control *dtc)
|
|
{
|
|
struct bdi_writeback *wb = dtc->wb;
|
|
unsigned long wb_reclaimable;
|
|
|
|
/*
|
|
* wb_thresh is not treated as some limiting factor as
|
|
* dirty_thresh, due to reasons
|
|
* - in JBOD setup, wb_thresh can fluctuate a lot
|
|
* - in a system with HDD and USB key, the USB key may somehow
|
|
* go into state (wb_dirty >> wb_thresh) either because
|
|
* wb_dirty starts high, or because wb_thresh drops low.
|
|
* In this case we don't want to hard throttle the USB key
|
|
* dirtiers for 100 seconds until wb_dirty drops under
|
|
* wb_thresh. Instead the auxiliary wb control line in
|
|
* wb_position_ratio() will let the dirtier task progress
|
|
* at some rate <= (write_bw / 2) for bringing down wb_dirty.
|
|
*/
|
|
dtc->wb_thresh = __wb_calc_thresh(dtc);
|
|
dtc->wb_bg_thresh = dtc->thresh ?
|
|
div_u64((u64)dtc->wb_thresh * dtc->bg_thresh, dtc->thresh) : 0;
|
|
|
|
/*
|
|
* In order to avoid the stacked BDI deadlock we need
|
|
* to ensure we accurately count the 'dirty' pages when
|
|
* the threshold is low.
|
|
*
|
|
* Otherwise it would be possible to get thresh+n pages
|
|
* reported dirty, even though there are thresh-m pages
|
|
* actually dirty; with m+n sitting in the percpu
|
|
* deltas.
|
|
*/
|
|
if (dtc->wb_thresh < 2 * wb_stat_error(wb)) {
|
|
wb_reclaimable = wb_stat_sum(wb, WB_RECLAIMABLE);
|
|
dtc->wb_dirty = wb_reclaimable + wb_stat_sum(wb, WB_WRITEBACK);
|
|
} else {
|
|
wb_reclaimable = wb_stat(wb, WB_RECLAIMABLE);
|
|
dtc->wb_dirty = wb_reclaimable + wb_stat(wb, WB_WRITEBACK);
|
|
}
|
|
}
|
|
|
|
/*
|
|
* balance_dirty_pages() must be called by processes which are generating dirty
|
|
* data. It looks at the number of dirty pages in the machine and will force
|
|
* the caller to wait once crossing the (background_thresh + dirty_thresh) / 2.
|
|
* If we're over `background_thresh' then the writeback threads are woken to
|
|
* perform some writeout.
|
|
*/
|
|
static void balance_dirty_pages(struct address_space *mapping,
|
|
struct bdi_writeback *wb,
|
|
unsigned long pages_dirtied)
|
|
{
|
|
struct dirty_throttle_control gdtc_stor = { GDTC_INIT(wb) };
|
|
struct dirty_throttle_control mdtc_stor = { MDTC_INIT(wb, &gdtc_stor) };
|
|
struct dirty_throttle_control * const gdtc = &gdtc_stor;
|
|
struct dirty_throttle_control * const mdtc = mdtc_valid(&mdtc_stor) ?
|
|
&mdtc_stor : NULL;
|
|
struct dirty_throttle_control *sdtc;
|
|
unsigned long nr_reclaimable; /* = file_dirty + unstable_nfs */
|
|
long period;
|
|
long pause;
|
|
long max_pause;
|
|
long min_pause;
|
|
int nr_dirtied_pause;
|
|
bool dirty_exceeded = false;
|
|
unsigned long task_ratelimit;
|
|
unsigned long dirty_ratelimit;
|
|
struct backing_dev_info *bdi = wb->bdi;
|
|
bool strictlimit = bdi->capabilities & BDI_CAP_STRICTLIMIT;
|
|
unsigned long start_time = jiffies;
|
|
|
|
for (;;) {
|
|
unsigned long now = jiffies;
|
|
unsigned long dirty, thresh, bg_thresh;
|
|
unsigned long m_dirty = 0; /* stop bogus uninit warnings */
|
|
unsigned long m_thresh = 0;
|
|
unsigned long m_bg_thresh = 0;
|
|
|
|
/*
|
|
* Unstable writes are a feature of certain networked
|
|
* filesystems (i.e. NFS) in which data may have been
|
|
* written to the server's write cache, but has not yet
|
|
* been flushed to permanent storage.
|
|
*/
|
|
nr_reclaimable = global_node_page_state(NR_FILE_DIRTY) +
|
|
global_node_page_state(NR_UNSTABLE_NFS);
|
|
gdtc->avail = global_dirtyable_memory();
|
|
gdtc->dirty = nr_reclaimable + global_node_page_state(NR_WRITEBACK);
|
|
|
|
domain_dirty_limits(gdtc);
|
|
|
|
if (unlikely(strictlimit)) {
|
|
wb_dirty_limits(gdtc);
|
|
|
|
dirty = gdtc->wb_dirty;
|
|
thresh = gdtc->wb_thresh;
|
|
bg_thresh = gdtc->wb_bg_thresh;
|
|
} else {
|
|
dirty = gdtc->dirty;
|
|
thresh = gdtc->thresh;
|
|
bg_thresh = gdtc->bg_thresh;
|
|
}
|
|
|
|
if (mdtc) {
|
|
unsigned long filepages, headroom, writeback;
|
|
|
|
/*
|
|
* If @wb belongs to !root memcg, repeat the same
|
|
* basic calculations for the memcg domain.
|
|
*/
|
|
mem_cgroup_wb_stats(wb, &filepages, &headroom,
|
|
&mdtc->dirty, &writeback);
|
|
mdtc->dirty += writeback;
|
|
mdtc_calc_avail(mdtc, filepages, headroom);
|
|
|
|
domain_dirty_limits(mdtc);
|
|
|
|
if (unlikely(strictlimit)) {
|
|
wb_dirty_limits(mdtc);
|
|
m_dirty = mdtc->wb_dirty;
|
|
m_thresh = mdtc->wb_thresh;
|
|
m_bg_thresh = mdtc->wb_bg_thresh;
|
|
} else {
|
|
m_dirty = mdtc->dirty;
|
|
m_thresh = mdtc->thresh;
|
|
m_bg_thresh = mdtc->bg_thresh;
|
|
}
|
|
}
|
|
|
|
/*
|
|
* Throttle it only when the background writeback cannot
|
|
* catch-up. This avoids (excessively) small writeouts
|
|
* when the wb limits are ramping up in case of !strictlimit.
|
|
*
|
|
* In strictlimit case make decision based on the wb counters
|
|
* and limits. Small writeouts when the wb limits are ramping
|
|
* up are the price we consciously pay for strictlimit-ing.
|
|
*
|
|
* If memcg domain is in effect, @dirty should be under
|
|
* both global and memcg freerun ceilings.
|
|
*/
|
|
if (dirty <= dirty_freerun_ceiling(thresh, bg_thresh) &&
|
|
(!mdtc ||
|
|
m_dirty <= dirty_freerun_ceiling(m_thresh, m_bg_thresh))) {
|
|
unsigned long intv = dirty_poll_interval(dirty, thresh);
|
|
unsigned long m_intv = ULONG_MAX;
|
|
|
|
current->dirty_paused_when = now;
|
|
current->nr_dirtied = 0;
|
|
if (mdtc)
|
|
m_intv = dirty_poll_interval(m_dirty, m_thresh);
|
|
current->nr_dirtied_pause = min(intv, m_intv);
|
|
break;
|
|
}
|
|
|
|
if (unlikely(!writeback_in_progress(wb)))
|
|
wb_start_background_writeback(wb);
|
|
|
|
/*
|
|
* Calculate global domain's pos_ratio and select the
|
|
* global dtc by default.
|
|
*/
|
|
if (!strictlimit)
|
|
wb_dirty_limits(gdtc);
|
|
|
|
dirty_exceeded = (gdtc->wb_dirty > gdtc->wb_thresh) &&
|
|
((gdtc->dirty > gdtc->thresh) || strictlimit);
|
|
|
|
wb_position_ratio(gdtc);
|
|
sdtc = gdtc;
|
|
|
|
if (mdtc) {
|
|
/*
|
|
* If memcg domain is in effect, calculate its
|
|
* pos_ratio. @wb should satisfy constraints from
|
|
* both global and memcg domains. Choose the one
|
|
* w/ lower pos_ratio.
|
|
*/
|
|
if (!strictlimit)
|
|
wb_dirty_limits(mdtc);
|
|
|
|
dirty_exceeded |= (mdtc->wb_dirty > mdtc->wb_thresh) &&
|
|
((mdtc->dirty > mdtc->thresh) || strictlimit);
|
|
|
|
wb_position_ratio(mdtc);
|
|
if (mdtc->pos_ratio < gdtc->pos_ratio)
|
|
sdtc = mdtc;
|
|
}
|
|
|
|
if (dirty_exceeded && !wb->dirty_exceeded)
|
|
wb->dirty_exceeded = 1;
|
|
|
|
if (time_is_before_jiffies(wb->bw_time_stamp +
|
|
BANDWIDTH_INTERVAL)) {
|
|
spin_lock(&wb->list_lock);
|
|
__wb_update_bandwidth(gdtc, mdtc, start_time, true);
|
|
spin_unlock(&wb->list_lock);
|
|
}
|
|
|
|
/* throttle according to the chosen dtc */
|
|
dirty_ratelimit = wb->dirty_ratelimit;
|
|
task_ratelimit = ((u64)dirty_ratelimit * sdtc->pos_ratio) >>
|
|
RATELIMIT_CALC_SHIFT;
|
|
max_pause = wb_max_pause(wb, sdtc->wb_dirty);
|
|
min_pause = wb_min_pause(wb, max_pause,
|
|
task_ratelimit, dirty_ratelimit,
|
|
&nr_dirtied_pause);
|
|
|
|
if (unlikely(task_ratelimit == 0)) {
|
|
period = max_pause;
|
|
pause = max_pause;
|
|
goto pause;
|
|
}
|
|
period = HZ * pages_dirtied / task_ratelimit;
|
|
pause = period;
|
|
if (current->dirty_paused_when)
|
|
pause -= now - current->dirty_paused_when;
|
|
/*
|
|
* For less than 1s think time (ext3/4 may block the dirtier
|
|
* for up to 800ms from time to time on 1-HDD; so does xfs,
|
|
* however at much less frequency), try to compensate it in
|
|
* future periods by updating the virtual time; otherwise just
|
|
* do a reset, as it may be a light dirtier.
|
|
*/
|
|
if (pause < min_pause) {
|
|
trace_balance_dirty_pages(wb,
|
|
sdtc->thresh,
|
|
sdtc->bg_thresh,
|
|
sdtc->dirty,
|
|
sdtc->wb_thresh,
|
|
sdtc->wb_dirty,
|
|
dirty_ratelimit,
|
|
task_ratelimit,
|
|
pages_dirtied,
|
|
period,
|
|
min(pause, 0L),
|
|
start_time);
|
|
if (pause < -HZ) {
|
|
current->dirty_paused_when = now;
|
|
current->nr_dirtied = 0;
|
|
} else if (period) {
|
|
current->dirty_paused_when += period;
|
|
current->nr_dirtied = 0;
|
|
} else if (current->nr_dirtied_pause <= pages_dirtied)
|
|
current->nr_dirtied_pause += pages_dirtied;
|
|
break;
|
|
}
|
|
if (unlikely(pause > max_pause)) {
|
|
/* for occasional dropped task_ratelimit */
|
|
now += min(pause - max_pause, max_pause);
|
|
pause = max_pause;
|
|
}
|
|
|
|
pause:
|
|
trace_balance_dirty_pages(wb,
|
|
sdtc->thresh,
|
|
sdtc->bg_thresh,
|
|
sdtc->dirty,
|
|
sdtc->wb_thresh,
|
|
sdtc->wb_dirty,
|
|
dirty_ratelimit,
|
|
task_ratelimit,
|
|
pages_dirtied,
|
|
period,
|
|
pause,
|
|
start_time);
|
|
__set_current_state(TASK_KILLABLE);
|
|
wb->dirty_sleep = now;
|
|
io_schedule_timeout(pause);
|
|
|
|
current->dirty_paused_when = now + pause;
|
|
current->nr_dirtied = 0;
|
|
current->nr_dirtied_pause = nr_dirtied_pause;
|
|
|
|
/*
|
|
* This is typically equal to (dirty < thresh) and can also
|
|
* keep "1000+ dd on a slow USB stick" under control.
|
|
*/
|
|
if (task_ratelimit)
|
|
break;
|
|
|
|
/*
|
|
* In the case of an unresponding NFS server and the NFS dirty
|
|
* pages exceeds dirty_thresh, give the other good wb's a pipe
|
|
* to go through, so that tasks on them still remain responsive.
|
|
*
|
|
* In theory 1 page is enough to keep the consumer-producer
|
|
* pipe going: the flusher cleans 1 page => the task dirties 1
|
|
* more page. However wb_dirty has accounting errors. So use
|
|
* the larger and more IO friendly wb_stat_error.
|
|
*/
|
|
if (sdtc->wb_dirty <= wb_stat_error(wb))
|
|
break;
|
|
|
|
if (fatal_signal_pending(current))
|
|
break;
|
|
}
|
|
|
|
if (!dirty_exceeded && wb->dirty_exceeded)
|
|
wb->dirty_exceeded = 0;
|
|
|
|
if (writeback_in_progress(wb))
|
|
return;
|
|
|
|
/*
|
|
* In laptop mode, we wait until hitting the higher threshold before
|
|
* starting background writeout, and then write out all the way down
|
|
* to the lower threshold. So slow writers cause minimal disk activity.
|
|
*
|
|
* In normal mode, we start background writeout at the lower
|
|
* background_thresh, to keep the amount of dirty memory low.
|
|
*/
|
|
if (laptop_mode)
|
|
return;
|
|
|
|
if (nr_reclaimable > gdtc->bg_thresh)
|
|
wb_start_background_writeback(wb);
|
|
}
|
|
|
|
static DEFINE_PER_CPU(int, bdp_ratelimits);
|
|
|
|
/*
|
|
* Normal tasks are throttled by
|
|
* loop {
|
|
* dirty tsk->nr_dirtied_pause pages;
|
|
* take a snap in balance_dirty_pages();
|
|
* }
|
|
* However there is a worst case. If every task exit immediately when dirtied
|
|
* (tsk->nr_dirtied_pause - 1) pages, balance_dirty_pages() will never be
|
|
* called to throttle the page dirties. The solution is to save the not yet
|
|
* throttled page dirties in dirty_throttle_leaks on task exit and charge them
|
|
* randomly into the running tasks. This works well for the above worst case,
|
|
* as the new task will pick up and accumulate the old task's leaked dirty
|
|
* count and eventually get throttled.
|
|
*/
|
|
DEFINE_PER_CPU(int, dirty_throttle_leaks) = 0;
|
|
|
|
/**
|
|
* balance_dirty_pages_ratelimited - balance dirty memory state
|
|
* @mapping: address_space which was dirtied
|
|
*
|
|
* Processes which are dirtying memory should call in here once for each page
|
|
* which was newly dirtied. The function will periodically check the system's
|
|
* dirty state and will initiate writeback if needed.
|
|
*
|
|
* On really big machines, get_writeback_state is expensive, so try to avoid
|
|
* calling it too often (ratelimiting). But once we're over the dirty memory
|
|
* limit we decrease the ratelimiting by a lot, to prevent individual processes
|
|
* from overshooting the limit by (ratelimit_pages) each.
|
|
*/
|
|
void balance_dirty_pages_ratelimited(struct address_space *mapping)
|
|
{
|
|
struct inode *inode = mapping->host;
|
|
struct backing_dev_info *bdi = inode_to_bdi(inode);
|
|
struct bdi_writeback *wb = NULL;
|
|
int ratelimit;
|
|
int *p;
|
|
|
|
if (!bdi_cap_account_dirty(bdi))
|
|
return;
|
|
|
|
if (inode_cgwb_enabled(inode))
|
|
wb = wb_get_create_current(bdi, GFP_KERNEL);
|
|
if (!wb)
|
|
wb = &bdi->wb;
|
|
|
|
ratelimit = current->nr_dirtied_pause;
|
|
if (wb->dirty_exceeded)
|
|
ratelimit = min(ratelimit, 32 >> (PAGE_SHIFT - 10));
|
|
|
|
preempt_disable();
|
|
/*
|
|
* This prevents one CPU to accumulate too many dirtied pages without
|
|
* calling into balance_dirty_pages(), which can happen when there are
|
|
* 1000+ tasks, all of them start dirtying pages at exactly the same
|
|
* time, hence all honoured too large initial task->nr_dirtied_pause.
|
|
*/
|
|
p = this_cpu_ptr(&bdp_ratelimits);
|
|
if (unlikely(current->nr_dirtied >= ratelimit))
|
|
*p = 0;
|
|
else if (unlikely(*p >= ratelimit_pages)) {
|
|
*p = 0;
|
|
ratelimit = 0;
|
|
}
|
|
/*
|
|
* Pick up the dirtied pages by the exited tasks. This avoids lots of
|
|
* short-lived tasks (eg. gcc invocations in a kernel build) escaping
|
|
* the dirty throttling and livelock other long-run dirtiers.
|
|
*/
|
|
p = this_cpu_ptr(&dirty_throttle_leaks);
|
|
if (*p > 0 && current->nr_dirtied < ratelimit) {
|
|
unsigned long nr_pages_dirtied;
|
|
nr_pages_dirtied = min(*p, ratelimit - current->nr_dirtied);
|
|
*p -= nr_pages_dirtied;
|
|
current->nr_dirtied += nr_pages_dirtied;
|
|
}
|
|
preempt_enable();
|
|
|
|
if (unlikely(current->nr_dirtied >= ratelimit))
|
|
balance_dirty_pages(mapping, wb, current->nr_dirtied);
|
|
|
|
wb_put(wb);
|
|
}
|
|
EXPORT_SYMBOL(balance_dirty_pages_ratelimited);
|
|
|
|
/**
|
|
* wb_over_bg_thresh - does @wb need to be written back?
|
|
* @wb: bdi_writeback of interest
|
|
*
|
|
* Determines whether background writeback should keep writing @wb or it's
|
|
* clean enough. Returns %true if writeback should continue.
|
|
*/
|
|
bool wb_over_bg_thresh(struct bdi_writeback *wb)
|
|
{
|
|
struct dirty_throttle_control gdtc_stor = { GDTC_INIT(wb) };
|
|
struct dirty_throttle_control mdtc_stor = { MDTC_INIT(wb, &gdtc_stor) };
|
|
struct dirty_throttle_control * const gdtc = &gdtc_stor;
|
|
struct dirty_throttle_control * const mdtc = mdtc_valid(&mdtc_stor) ?
|
|
&mdtc_stor : NULL;
|
|
|
|
/*
|
|
* Similar to balance_dirty_pages() but ignores pages being written
|
|
* as we're trying to decide whether to put more under writeback.
|
|
*/
|
|
gdtc->avail = global_dirtyable_memory();
|
|
gdtc->dirty = global_node_page_state(NR_FILE_DIRTY) +
|
|
global_node_page_state(NR_UNSTABLE_NFS);
|
|
domain_dirty_limits(gdtc);
|
|
|
|
if (gdtc->dirty > gdtc->bg_thresh)
|
|
return true;
|
|
|
|
if (wb_stat(wb, WB_RECLAIMABLE) >
|
|
wb_calc_thresh(gdtc->wb, gdtc->bg_thresh))
|
|
return true;
|
|
|
|
if (mdtc) {
|
|
unsigned long filepages, headroom, writeback;
|
|
|
|
mem_cgroup_wb_stats(wb, &filepages, &headroom, &mdtc->dirty,
|
|
&writeback);
|
|
mdtc_calc_avail(mdtc, filepages, headroom);
|
|
domain_dirty_limits(mdtc); /* ditto, ignore writeback */
|
|
|
|
if (mdtc->dirty > mdtc->bg_thresh)
|
|
return true;
|
|
|
|
if (wb_stat(wb, WB_RECLAIMABLE) >
|
|
wb_calc_thresh(mdtc->wb, mdtc->bg_thresh))
|
|
return true;
|
|
}
|
|
|
|
return false;
|
|
}
|
|
|
|
/*
|
|
* sysctl handler for /proc/sys/vm/dirty_writeback_centisecs
|
|
*/
|
|
int dirty_writeback_centisecs_handler(struct ctl_table *table, int write,
|
|
void __user *buffer, size_t *length, loff_t *ppos)
|
|
{
|
|
proc_dointvec(table, write, buffer, length, ppos);
|
|
return 0;
|
|
}
|
|
|
|
#ifdef CONFIG_BLOCK
|
|
void laptop_mode_timer_fn(unsigned long data)
|
|
{
|
|
struct request_queue *q = (struct request_queue *)data;
|
|
int nr_pages = global_node_page_state(NR_FILE_DIRTY) +
|
|
global_node_page_state(NR_UNSTABLE_NFS);
|
|
struct bdi_writeback *wb;
|
|
|
|
/*
|
|
* We want to write everything out, not just down to the dirty
|
|
* threshold
|
|
*/
|
|
if (!bdi_has_dirty_io(q->backing_dev_info))
|
|
return;
|
|
|
|
rcu_read_lock();
|
|
list_for_each_entry_rcu(wb, &q->backing_dev_info->wb_list, bdi_node)
|
|
if (wb_has_dirty_io(wb))
|
|
wb_start_writeback(wb, nr_pages, true,
|
|
WB_REASON_LAPTOP_TIMER);
|
|
rcu_read_unlock();
|
|
}
|
|
|
|
/*
|
|
* We've spun up the disk and we're in laptop mode: schedule writeback
|
|
* of all dirty data a few seconds from now. If the flush is already scheduled
|
|
* then push it back - the user is still using the disk.
|
|
*/
|
|
void laptop_io_completion(struct backing_dev_info *info)
|
|
{
|
|
mod_timer(&info->laptop_mode_wb_timer, jiffies + laptop_mode);
|
|
}
|
|
|
|
/*
|
|
* We're in laptop mode and we've just synced. The sync's writes will have
|
|
* caused another writeback to be scheduled by laptop_io_completion.
|
|
* Nothing needs to be written back anymore, so we unschedule the writeback.
|
|
*/
|
|
void laptop_sync_completion(void)
|
|
{
|
|
struct backing_dev_info *bdi;
|
|
|
|
rcu_read_lock();
|
|
|
|
list_for_each_entry_rcu(bdi, &bdi_list, bdi_list)
|
|
del_timer(&bdi->laptop_mode_wb_timer);
|
|
|
|
rcu_read_unlock();
|
|
}
|
|
#endif
|
|
|
|
/*
|
|
* If ratelimit_pages is too high then we can get into dirty-data overload
|
|
* if a large number of processes all perform writes at the same time.
|
|
* If it is too low then SMP machines will call the (expensive)
|
|
* get_writeback_state too often.
|
|
*
|
|
* Here we set ratelimit_pages to a level which ensures that when all CPUs are
|
|
* dirtying in parallel, we cannot go more than 3% (1/32) over the dirty memory
|
|
* thresholds.
|
|
*/
|
|
|
|
void writeback_set_ratelimit(void)
|
|
{
|
|
struct wb_domain *dom = &global_wb_domain;
|
|
unsigned long background_thresh;
|
|
unsigned long dirty_thresh;
|
|
|
|
global_dirty_limits(&background_thresh, &dirty_thresh);
|
|
dom->dirty_limit = dirty_thresh;
|
|
ratelimit_pages = dirty_thresh / (num_online_cpus() * 32);
|
|
if (ratelimit_pages < 16)
|
|
ratelimit_pages = 16;
|
|
}
|
|
|
|
static int page_writeback_cpu_online(unsigned int cpu)
|
|
{
|
|
writeback_set_ratelimit();
|
|
return 0;
|
|
}
|
|
|
|
/*
|
|
* Called early on to tune the page writeback dirty limits.
|
|
*
|
|
* We used to scale dirty pages according to how total memory
|
|
* related to pages that could be allocated for buffers (by
|
|
* comparing nr_free_buffer_pages() to vm_total_pages.
|
|
*
|
|
* However, that was when we used "dirty_ratio" to scale with
|
|
* all memory, and we don't do that any more. "dirty_ratio"
|
|
* is now applied to total non-HIGHPAGE memory (by subtracting
|
|
* totalhigh_pages from vm_total_pages), and as such we can't
|
|
* get into the old insane situation any more where we had
|
|
* large amounts of dirty pages compared to a small amount of
|
|
* non-HIGHMEM memory.
|
|
*
|
|
* But we might still want to scale the dirty_ratio by how
|
|
* much memory the box has..
|
|
*/
|
|
void __init page_writeback_init(void)
|
|
{
|
|
BUG_ON(wb_domain_init(&global_wb_domain, GFP_KERNEL));
|
|
|
|
cpuhp_setup_state(CPUHP_AP_ONLINE_DYN, "mm/writeback:online",
|
|
page_writeback_cpu_online, NULL);
|
|
cpuhp_setup_state(CPUHP_MM_WRITEBACK_DEAD, "mm/writeback:dead", NULL,
|
|
page_writeback_cpu_online);
|
|
}
|
|
|
|
/**
|
|
* tag_pages_for_writeback - tag pages to be written by write_cache_pages
|
|
* @mapping: address space structure to write
|
|
* @start: starting page index
|
|
* @end: ending page index (inclusive)
|
|
*
|
|
* This function scans the page range from @start to @end (inclusive) and tags
|
|
* all pages that have DIRTY tag set with a special TOWRITE tag. The idea is
|
|
* that write_cache_pages (or whoever calls this function) will then use
|
|
* TOWRITE tag to identify pages eligible for writeback. This mechanism is
|
|
* used to avoid livelocking of writeback by a process steadily creating new
|
|
* dirty pages in the file (thus it is important for this function to be quick
|
|
* so that it can tag pages faster than a dirtying process can create them).
|
|
*/
|
|
/*
|
|
* We tag pages in batches of WRITEBACK_TAG_BATCH to reduce tree_lock latency.
|
|
*/
|
|
void tag_pages_for_writeback(struct address_space *mapping,
|
|
pgoff_t start, pgoff_t end)
|
|
{
|
|
#define WRITEBACK_TAG_BATCH 4096
|
|
unsigned long tagged = 0;
|
|
struct radix_tree_iter iter;
|
|
void **slot;
|
|
|
|
spin_lock_irq(&mapping->tree_lock);
|
|
radix_tree_for_each_tagged(slot, &mapping->page_tree, &iter, start,
|
|
PAGECACHE_TAG_DIRTY) {
|
|
if (iter.index > end)
|
|
break;
|
|
radix_tree_iter_tag_set(&mapping->page_tree, &iter,
|
|
PAGECACHE_TAG_TOWRITE);
|
|
tagged++;
|
|
if ((tagged % WRITEBACK_TAG_BATCH) != 0)
|
|
continue;
|
|
slot = radix_tree_iter_resume(slot, &iter);
|
|
spin_unlock_irq(&mapping->tree_lock);
|
|
cond_resched();
|
|
spin_lock_irq(&mapping->tree_lock);
|
|
}
|
|
spin_unlock_irq(&mapping->tree_lock);
|
|
}
|
|
EXPORT_SYMBOL(tag_pages_for_writeback);
|
|
|
|
/**
|
|
* write_cache_pages - walk the list of dirty pages of the given address space and write all of them.
|
|
* @mapping: address space structure to write
|
|
* @wbc: subtract the number of written pages from *@wbc->nr_to_write
|
|
* @writepage: function called for each page
|
|
* @data: data passed to writepage function
|
|
*
|
|
* If a page is already under I/O, write_cache_pages() skips it, even
|
|
* if it's dirty. This is desirable behaviour for memory-cleaning writeback,
|
|
* but it is INCORRECT for data-integrity system calls such as fsync(). fsync()
|
|
* and msync() need to guarantee that all the data which was dirty at the time
|
|
* the call was made get new I/O started against them. If wbc->sync_mode is
|
|
* WB_SYNC_ALL then we were called for data integrity and we must wait for
|
|
* existing IO to complete.
|
|
*
|
|
* To avoid livelocks (when other process dirties new pages), we first tag
|
|
* pages which should be written back with TOWRITE tag and only then start
|
|
* writing them. For data-integrity sync we have to be careful so that we do
|
|
* not miss some pages (e.g., because some other process has cleared TOWRITE
|
|
* tag we set). The rule we follow is that TOWRITE tag can be cleared only
|
|
* by the process clearing the DIRTY tag (and submitting the page for IO).
|
|
*/
|
|
int write_cache_pages(struct address_space *mapping,
|
|
struct writeback_control *wbc, writepage_t writepage,
|
|
void *data)
|
|
{
|
|
int ret = 0;
|
|
int done = 0;
|
|
struct pagevec pvec;
|
|
int nr_pages;
|
|
pgoff_t uninitialized_var(writeback_index);
|
|
pgoff_t index;
|
|
pgoff_t end; /* Inclusive */
|
|
pgoff_t done_index;
|
|
int cycled;
|
|
int range_whole = 0;
|
|
int tag;
|
|
|
|
pagevec_init(&pvec, 0);
|
|
if (wbc->range_cyclic) {
|
|
writeback_index = mapping->writeback_index; /* prev offset */
|
|
index = writeback_index;
|
|
if (index == 0)
|
|
cycled = 1;
|
|
else
|
|
cycled = 0;
|
|
end = -1;
|
|
} else {
|
|
index = wbc->range_start >> PAGE_SHIFT;
|
|
end = wbc->range_end >> PAGE_SHIFT;
|
|
if (wbc->range_start == 0 && wbc->range_end == LLONG_MAX)
|
|
range_whole = 1;
|
|
cycled = 1; /* ignore range_cyclic tests */
|
|
}
|
|
if (wbc->sync_mode == WB_SYNC_ALL || wbc->tagged_writepages)
|
|
tag = PAGECACHE_TAG_TOWRITE;
|
|
else
|
|
tag = PAGECACHE_TAG_DIRTY;
|
|
retry:
|
|
if (wbc->sync_mode == WB_SYNC_ALL || wbc->tagged_writepages)
|
|
tag_pages_for_writeback(mapping, index, end);
|
|
done_index = index;
|
|
while (!done && (index <= end)) {
|
|
int i;
|
|
|
|
nr_pages = pagevec_lookup_tag(&pvec, mapping, &index, tag,
|
|
min(end - index, (pgoff_t)PAGEVEC_SIZE-1) + 1);
|
|
if (nr_pages == 0)
|
|
break;
|
|
|
|
for (i = 0; i < nr_pages; i++) {
|
|
struct page *page = pvec.pages[i];
|
|
|
|
/*
|
|
* At this point, the page may be truncated or
|
|
* invalidated (changing page->mapping to NULL), or
|
|
* even swizzled back from swapper_space to tmpfs file
|
|
* mapping. However, page->index will not change
|
|
* because we have a reference on the page.
|
|
*/
|
|
if (page->index > end) {
|
|
/*
|
|
* can't be range_cyclic (1st pass) because
|
|
* end == -1 in that case.
|
|
*/
|
|
done = 1;
|
|
break;
|
|
}
|
|
|
|
done_index = page->index;
|
|
|
|
lock_page(page);
|
|
|
|
/*
|
|
* Page truncated or invalidated. We can freely skip it
|
|
* then, even for data integrity operations: the page
|
|
* has disappeared concurrently, so there could be no
|
|
* real expectation of this data interity operation
|
|
* even if there is now a new, dirty page at the same
|
|
* pagecache address.
|
|
*/
|
|
if (unlikely(page->mapping != mapping)) {
|
|
continue_unlock:
|
|
unlock_page(page);
|
|
continue;
|
|
}
|
|
|
|
if (!PageDirty(page)) {
|
|
/* someone wrote it for us */
|
|
goto continue_unlock;
|
|
}
|
|
|
|
if (PageWriteback(page)) {
|
|
if (wbc->sync_mode != WB_SYNC_NONE)
|
|
wait_on_page_writeback(page);
|
|
else
|
|
goto continue_unlock;
|
|
}
|
|
|
|
BUG_ON(PageWriteback(page));
|
|
if (!clear_page_dirty_for_io(page))
|
|
goto continue_unlock;
|
|
|
|
trace_wbc_writepage(wbc, inode_to_bdi(mapping->host));
|
|
ret = (*writepage)(page, wbc, data);
|
|
if (unlikely(ret)) {
|
|
if (ret == AOP_WRITEPAGE_ACTIVATE) {
|
|
unlock_page(page);
|
|
ret = 0;
|
|
} else {
|
|
/*
|
|
* done_index is set past this page,
|
|
* so media errors will not choke
|
|
* background writeout for the entire
|
|
* file. This has consequences for
|
|
* range_cyclic semantics (ie. it may
|
|
* not be suitable for data integrity
|
|
* writeout).
|
|
*/
|
|
done_index = page->index + 1;
|
|
done = 1;
|
|
break;
|
|
}
|
|
}
|
|
|
|
/*
|
|
* We stop writing back only if we are not doing
|
|
* integrity sync. In case of integrity sync we have to
|
|
* keep going until we have written all the pages
|
|
* we tagged for writeback prior to entering this loop.
|
|
*/
|
|
if (--wbc->nr_to_write <= 0 &&
|
|
wbc->sync_mode == WB_SYNC_NONE) {
|
|
done = 1;
|
|
break;
|
|
}
|
|
}
|
|
pagevec_release(&pvec);
|
|
cond_resched();
|
|
}
|
|
if (!cycled && !done) {
|
|
/*
|
|
* range_cyclic:
|
|
* We hit the last page and there is more work to be done: wrap
|
|
* back to the start of the file
|
|
*/
|
|
cycled = 1;
|
|
index = 0;
|
|
end = writeback_index - 1;
|
|
goto retry;
|
|
}
|
|
if (wbc->range_cyclic || (range_whole && wbc->nr_to_write > 0))
|
|
mapping->writeback_index = done_index;
|
|
|
|
return ret;
|
|
}
|
|
EXPORT_SYMBOL(write_cache_pages);
|
|
|
|
/*
|
|
* Function used by generic_writepages to call the real writepage
|
|
* function and set the mapping flags on error
|
|
*/
|
|
static int __writepage(struct page *page, struct writeback_control *wbc,
|
|
void *data)
|
|
{
|
|
struct address_space *mapping = data;
|
|
int ret = mapping->a_ops->writepage(page, wbc);
|
|
mapping_set_error(mapping, ret);
|
|
return ret;
|
|
}
|
|
|
|
/**
|
|
* generic_writepages - walk the list of dirty pages of the given address space and writepage() all of them.
|
|
* @mapping: address space structure to write
|
|
* @wbc: subtract the number of written pages from *@wbc->nr_to_write
|
|
*
|
|
* This is a library function, which implements the writepages()
|
|
* address_space_operation.
|
|
*/
|
|
int generic_writepages(struct address_space *mapping,
|
|
struct writeback_control *wbc)
|
|
{
|
|
struct blk_plug plug;
|
|
int ret;
|
|
|
|
/* deal with chardevs and other special file */
|
|
if (!mapping->a_ops->writepage)
|
|
return 0;
|
|
|
|
blk_start_plug(&plug);
|
|
ret = write_cache_pages(mapping, wbc, __writepage, mapping);
|
|
blk_finish_plug(&plug);
|
|
return ret;
|
|
}
|
|
|
|
EXPORT_SYMBOL(generic_writepages);
|
|
|
|
int do_writepages(struct address_space *mapping, struct writeback_control *wbc)
|
|
{
|
|
int ret;
|
|
|
|
if (wbc->nr_to_write <= 0)
|
|
return 0;
|
|
while (1) {
|
|
if (mapping->a_ops->writepages)
|
|
ret = mapping->a_ops->writepages(mapping, wbc);
|
|
else
|
|
ret = generic_writepages(mapping, wbc);
|
|
if ((ret != -ENOMEM) || (wbc->sync_mode != WB_SYNC_ALL))
|
|
break;
|
|
cond_resched();
|
|
congestion_wait(BLK_RW_ASYNC, HZ/50);
|
|
}
|
|
return ret;
|
|
}
|
|
|
|
/**
|
|
* write_one_page - write out a single page and wait on I/O
|
|
* @page: the page to write
|
|
*
|
|
* The page must be locked by the caller and will be unlocked upon return.
|
|
*
|
|
* Note that the mapping's AS_EIO/AS_ENOSPC flags will be cleared when this
|
|
* function returns.
|
|
*/
|
|
int write_one_page(struct page *page)
|
|
{
|
|
struct address_space *mapping = page->mapping;
|
|
int ret = 0;
|
|
struct writeback_control wbc = {
|
|
.sync_mode = WB_SYNC_ALL,
|
|
.nr_to_write = 1,
|
|
};
|
|
|
|
BUG_ON(!PageLocked(page));
|
|
|
|
wait_on_page_writeback(page);
|
|
|
|
if (clear_page_dirty_for_io(page)) {
|
|
get_page(page);
|
|
ret = mapping->a_ops->writepage(page, &wbc);
|
|
if (ret == 0)
|
|
wait_on_page_writeback(page);
|
|
put_page(page);
|
|
} else {
|
|
unlock_page(page);
|
|
}
|
|
|
|
if (!ret)
|
|
ret = filemap_check_errors(mapping);
|
|
return ret;
|
|
}
|
|
EXPORT_SYMBOL(write_one_page);
|
|
|
|
/*
|
|
* For address_spaces which do not use buffers nor write back.
|
|
*/
|
|
int __set_page_dirty_no_writeback(struct page *page)
|
|
{
|
|
if (!PageDirty(page))
|
|
return !TestSetPageDirty(page);
|
|
return 0;
|
|
}
|
|
|
|
/*
|
|
* Helper function for set_page_dirty family.
|
|
*
|
|
* Caller must hold lock_page_memcg().
|
|
*
|
|
* NOTE: This relies on being atomic wrt interrupts.
|
|
*/
|
|
void account_page_dirtied(struct page *page, struct address_space *mapping)
|
|
{
|
|
struct inode *inode = mapping->host;
|
|
|
|
trace_writeback_dirty_page(page, mapping);
|
|
|
|
if (mapping_cap_account_dirty(mapping)) {
|
|
struct bdi_writeback *wb;
|
|
|
|
inode_attach_wb(inode, page);
|
|
wb = inode_to_wb(inode);
|
|
|
|
__inc_lruvec_page_state(page, NR_FILE_DIRTY);
|
|
__inc_zone_page_state(page, NR_ZONE_WRITE_PENDING);
|
|
__inc_node_page_state(page, NR_DIRTIED);
|
|
inc_wb_stat(wb, WB_RECLAIMABLE);
|
|
inc_wb_stat(wb, WB_DIRTIED);
|
|
task_io_account_write(PAGE_SIZE);
|
|
current->nr_dirtied++;
|
|
this_cpu_inc(bdp_ratelimits);
|
|
}
|
|
}
|
|
EXPORT_SYMBOL(account_page_dirtied);
|
|
|
|
/*
|
|
* Helper function for deaccounting dirty page without writeback.
|
|
*
|
|
* Caller must hold lock_page_memcg().
|
|
*/
|
|
void account_page_cleaned(struct page *page, struct address_space *mapping,
|
|
struct bdi_writeback *wb)
|
|
{
|
|
if (mapping_cap_account_dirty(mapping)) {
|
|
dec_lruvec_page_state(page, NR_FILE_DIRTY);
|
|
dec_zone_page_state(page, NR_ZONE_WRITE_PENDING);
|
|
dec_wb_stat(wb, WB_RECLAIMABLE);
|
|
task_io_account_cancelled_write(PAGE_SIZE);
|
|
}
|
|
}
|
|
|
|
/*
|
|
* For address_spaces which do not use buffers. Just tag the page as dirty in
|
|
* its radix tree.
|
|
*
|
|
* This is also used when a single buffer is being dirtied: we want to set the
|
|
* page dirty in that case, but not all the buffers. This is a "bottom-up"
|
|
* dirtying, whereas __set_page_dirty_buffers() is a "top-down" dirtying.
|
|
*
|
|
* The caller must ensure this doesn't race with truncation. Most will simply
|
|
* hold the page lock, but e.g. zap_pte_range() calls with the page mapped and
|
|
* the pte lock held, which also locks out truncation.
|
|
*/
|
|
int __set_page_dirty_nobuffers(struct page *page)
|
|
{
|
|
lock_page_memcg(page);
|
|
if (!TestSetPageDirty(page)) {
|
|
struct address_space *mapping = page_mapping(page);
|
|
unsigned long flags;
|
|
|
|
if (!mapping) {
|
|
unlock_page_memcg(page);
|
|
return 1;
|
|
}
|
|
|
|
spin_lock_irqsave(&mapping->tree_lock, flags);
|
|
BUG_ON(page_mapping(page) != mapping);
|
|
WARN_ON_ONCE(!PagePrivate(page) && !PageUptodate(page));
|
|
account_page_dirtied(page, mapping);
|
|
radix_tree_tag_set(&mapping->page_tree, page_index(page),
|
|
PAGECACHE_TAG_DIRTY);
|
|
spin_unlock_irqrestore(&mapping->tree_lock, flags);
|
|
unlock_page_memcg(page);
|
|
|
|
if (mapping->host) {
|
|
/* !PageAnon && !swapper_space */
|
|
__mark_inode_dirty(mapping->host, I_DIRTY_PAGES);
|
|
}
|
|
return 1;
|
|
}
|
|
unlock_page_memcg(page);
|
|
return 0;
|
|
}
|
|
EXPORT_SYMBOL(__set_page_dirty_nobuffers);
|
|
|
|
/*
|
|
* Call this whenever redirtying a page, to de-account the dirty counters
|
|
* (NR_DIRTIED, BDI_DIRTIED, tsk->nr_dirtied), so that they match the written
|
|
* counters (NR_WRITTEN, BDI_WRITTEN) in long term. The mismatches will lead to
|
|
* systematic errors in balanced_dirty_ratelimit and the dirty pages position
|
|
* control.
|
|
*/
|
|
void account_page_redirty(struct page *page)
|
|
{
|
|
struct address_space *mapping = page->mapping;
|
|
|
|
if (mapping && mapping_cap_account_dirty(mapping)) {
|
|
struct inode *inode = mapping->host;
|
|
struct bdi_writeback *wb;
|
|
struct wb_lock_cookie cookie = {};
|
|
|
|
wb = unlocked_inode_to_wb_begin(inode, &cookie);
|
|
current->nr_dirtied--;
|
|
dec_node_page_state(page, NR_DIRTIED);
|
|
dec_wb_stat(wb, WB_DIRTIED);
|
|
unlocked_inode_to_wb_end(inode, &cookie);
|
|
}
|
|
}
|
|
EXPORT_SYMBOL(account_page_redirty);
|
|
|
|
/*
|
|
* When a writepage implementation decides that it doesn't want to write this
|
|
* page for some reason, it should redirty the locked page via
|
|
* redirty_page_for_writepage() and it should then unlock the page and return 0
|
|
*/
|
|
int redirty_page_for_writepage(struct writeback_control *wbc, struct page *page)
|
|
{
|
|
int ret;
|
|
|
|
wbc->pages_skipped++;
|
|
ret = __set_page_dirty_nobuffers(page);
|
|
account_page_redirty(page);
|
|
return ret;
|
|
}
|
|
EXPORT_SYMBOL(redirty_page_for_writepage);
|
|
|
|
/*
|
|
* Dirty a page.
|
|
*
|
|
* For pages with a mapping this should be done under the page lock
|
|
* for the benefit of asynchronous memory errors who prefer a consistent
|
|
* dirty state. This rule can be broken in some special cases,
|
|
* but should be better not to.
|
|
*
|
|
* If the mapping doesn't provide a set_page_dirty a_op, then
|
|
* just fall through and assume that it wants buffer_heads.
|
|
*/
|
|
int set_page_dirty(struct page *page)
|
|
{
|
|
struct address_space *mapping = page_mapping(page);
|
|
|
|
page = compound_head(page);
|
|
if (likely(mapping)) {
|
|
int (*spd)(struct page *) = mapping->a_ops->set_page_dirty;
|
|
/*
|
|
* readahead/lru_deactivate_page could remain
|
|
* PG_readahead/PG_reclaim due to race with end_page_writeback
|
|
* About readahead, if the page is written, the flags would be
|
|
* reset. So no problem.
|
|
* About lru_deactivate_page, if the page is redirty, the flag
|
|
* will be reset. So no problem. but if the page is used by readahead
|
|
* it will confuse readahead and make it restart the size rampup
|
|
* process. But it's a trivial problem.
|
|
*/
|
|
if (PageReclaim(page))
|
|
ClearPageReclaim(page);
|
|
#ifdef CONFIG_BLOCK
|
|
if (!spd)
|
|
spd = __set_page_dirty_buffers;
|
|
#endif
|
|
return (*spd)(page);
|
|
}
|
|
if (!PageDirty(page)) {
|
|
if (!TestSetPageDirty(page))
|
|
return 1;
|
|
}
|
|
return 0;
|
|
}
|
|
EXPORT_SYMBOL(set_page_dirty);
|
|
|
|
/*
|
|
* set_page_dirty() is racy if the caller has no reference against
|
|
* page->mapping->host, and if the page is unlocked. This is because another
|
|
* CPU could truncate the page off the mapping and then free the mapping.
|
|
*
|
|
* Usually, the page _is_ locked, or the caller is a user-space process which
|
|
* holds a reference on the inode by having an open file.
|
|
*
|
|
* In other cases, the page should be locked before running set_page_dirty().
|
|
*/
|
|
int set_page_dirty_lock(struct page *page)
|
|
{
|
|
int ret;
|
|
|
|
lock_page(page);
|
|
ret = set_page_dirty(page);
|
|
unlock_page(page);
|
|
return ret;
|
|
}
|
|
EXPORT_SYMBOL(set_page_dirty_lock);
|
|
|
|
/*
|
|
* This cancels just the dirty bit on the kernel page itself, it does NOT
|
|
* actually remove dirty bits on any mmap's that may be around. It also
|
|
* leaves the page tagged dirty, so any sync activity will still find it on
|
|
* the dirty lists, and in particular, clear_page_dirty_for_io() will still
|
|
* look at the dirty bits in the VM.
|
|
*
|
|
* Doing this should *normally* only ever be done when a page is truncated,
|
|
* and is not actually mapped anywhere at all. However, fs/buffer.c does
|
|
* this when it notices that somebody has cleaned out all the buffers on a
|
|
* page without actually doing it through the VM. Can you say "ext3 is
|
|
* horribly ugly"? Thought you could.
|
|
*/
|
|
void cancel_dirty_page(struct page *page)
|
|
{
|
|
struct address_space *mapping = page_mapping(page);
|
|
|
|
if (mapping_cap_account_dirty(mapping)) {
|
|
struct inode *inode = mapping->host;
|
|
struct bdi_writeback *wb;
|
|
struct wb_lock_cookie cookie = {};
|
|
|
|
lock_page_memcg(page);
|
|
wb = unlocked_inode_to_wb_begin(inode, &cookie);
|
|
|
|
if (TestClearPageDirty(page))
|
|
account_page_cleaned(page, mapping, wb);
|
|
|
|
unlocked_inode_to_wb_end(inode, &cookie);
|
|
unlock_page_memcg(page);
|
|
} else {
|
|
ClearPageDirty(page);
|
|
}
|
|
}
|
|
EXPORT_SYMBOL(cancel_dirty_page);
|
|
|
|
/*
|
|
* Clear a page's dirty flag, while caring for dirty memory accounting.
|
|
* Returns true if the page was previously dirty.
|
|
*
|
|
* This is for preparing to put the page under writeout. We leave the page
|
|
* tagged as dirty in the radix tree so that a concurrent write-for-sync
|
|
* can discover it via a PAGECACHE_TAG_DIRTY walk. The ->writepage
|
|
* implementation will run either set_page_writeback() or set_page_dirty(),
|
|
* at which stage we bring the page's dirty flag and radix-tree dirty tag
|
|
* back into sync.
|
|
*
|
|
* This incoherency between the page's dirty flag and radix-tree tag is
|
|
* unfortunate, but it only exists while the page is locked.
|
|
*/
|
|
int clear_page_dirty_for_io(struct page *page)
|
|
{
|
|
struct address_space *mapping = page_mapping(page);
|
|
int ret = 0;
|
|
|
|
BUG_ON(!PageLocked(page));
|
|
|
|
if (mapping && mapping_cap_account_dirty(mapping)) {
|
|
struct inode *inode = mapping->host;
|
|
struct bdi_writeback *wb;
|
|
struct wb_lock_cookie cookie = {};
|
|
|
|
/*
|
|
* Yes, Virginia, this is indeed insane.
|
|
*
|
|
* We use this sequence to make sure that
|
|
* (a) we account for dirty stats properly
|
|
* (b) we tell the low-level filesystem to
|
|
* mark the whole page dirty if it was
|
|
* dirty in a pagetable. Only to then
|
|
* (c) clean the page again and return 1 to
|
|
* cause the writeback.
|
|
*
|
|
* This way we avoid all nasty races with the
|
|
* dirty bit in multiple places and clearing
|
|
* them concurrently from different threads.
|
|
*
|
|
* Note! Normally the "set_page_dirty(page)"
|
|
* has no effect on the actual dirty bit - since
|
|
* that will already usually be set. But we
|
|
* need the side effects, and it can help us
|
|
* avoid races.
|
|
*
|
|
* We basically use the page "master dirty bit"
|
|
* as a serialization point for all the different
|
|
* threads doing their things.
|
|
*/
|
|
if (page_mkclean(page))
|
|
set_page_dirty(page);
|
|
/*
|
|
* We carefully synchronise fault handlers against
|
|
* installing a dirty pte and marking the page dirty
|
|
* at this point. We do this by having them hold the
|
|
* page lock while dirtying the page, and pages are
|
|
* always locked coming in here, so we get the desired
|
|
* exclusion.
|
|
*/
|
|
wb = unlocked_inode_to_wb_begin(inode, &cookie);
|
|
if (TestClearPageDirty(page)) {
|
|
dec_lruvec_page_state(page, NR_FILE_DIRTY);
|
|
dec_zone_page_state(page, NR_ZONE_WRITE_PENDING);
|
|
dec_wb_stat(wb, WB_RECLAIMABLE);
|
|
ret = 1;
|
|
}
|
|
unlocked_inode_to_wb_end(inode, &cookie);
|
|
return ret;
|
|
}
|
|
return TestClearPageDirty(page);
|
|
}
|
|
EXPORT_SYMBOL(clear_page_dirty_for_io);
|
|
|
|
int test_clear_page_writeback(struct page *page)
|
|
{
|
|
struct address_space *mapping = page_mapping(page);
|
|
struct mem_cgroup *memcg;
|
|
struct lruvec *lruvec;
|
|
int ret;
|
|
|
|
memcg = lock_page_memcg(page);
|
|
lruvec = mem_cgroup_page_lruvec(page, page_pgdat(page));
|
|
if (mapping && mapping_use_writeback_tags(mapping)) {
|
|
struct inode *inode = mapping->host;
|
|
struct backing_dev_info *bdi = inode_to_bdi(inode);
|
|
unsigned long flags;
|
|
|
|
spin_lock_irqsave(&mapping->tree_lock, flags);
|
|
ret = TestClearPageWriteback(page);
|
|
if (ret) {
|
|
radix_tree_tag_clear(&mapping->page_tree,
|
|
page_index(page),
|
|
PAGECACHE_TAG_WRITEBACK);
|
|
if (bdi_cap_account_writeback(bdi)) {
|
|
struct bdi_writeback *wb = inode_to_wb(inode);
|
|
|
|
dec_wb_stat(wb, WB_WRITEBACK);
|
|
__wb_writeout_inc(wb);
|
|
}
|
|
}
|
|
|
|
if (mapping->host && !mapping_tagged(mapping,
|
|
PAGECACHE_TAG_WRITEBACK))
|
|
sb_clear_inode_writeback(mapping->host);
|
|
|
|
spin_unlock_irqrestore(&mapping->tree_lock, flags);
|
|
} else {
|
|
ret = TestClearPageWriteback(page);
|
|
}
|
|
/*
|
|
* NOTE: Page might be free now! Writeback doesn't hold a page
|
|
* reference on its own, it relies on truncation to wait for
|
|
* the clearing of PG_writeback. The below can only access
|
|
* page state that is static across allocation cycles.
|
|
*/
|
|
if (ret) {
|
|
dec_lruvec_state(lruvec, NR_WRITEBACK);
|
|
dec_zone_page_state(page, NR_ZONE_WRITE_PENDING);
|
|
inc_node_page_state(page, NR_WRITTEN);
|
|
}
|
|
__unlock_page_memcg(memcg);
|
|
return ret;
|
|
}
|
|
|
|
int __test_set_page_writeback(struct page *page, bool keep_write)
|
|
{
|
|
struct address_space *mapping = page_mapping(page);
|
|
int ret;
|
|
|
|
lock_page_memcg(page);
|
|
if (mapping && mapping_use_writeback_tags(mapping)) {
|
|
struct inode *inode = mapping->host;
|
|
struct backing_dev_info *bdi = inode_to_bdi(inode);
|
|
unsigned long flags;
|
|
|
|
spin_lock_irqsave(&mapping->tree_lock, flags);
|
|
ret = TestSetPageWriteback(page);
|
|
if (!ret) {
|
|
bool on_wblist;
|
|
|
|
on_wblist = mapping_tagged(mapping,
|
|
PAGECACHE_TAG_WRITEBACK);
|
|
|
|
radix_tree_tag_set(&mapping->page_tree,
|
|
page_index(page),
|
|
PAGECACHE_TAG_WRITEBACK);
|
|
if (bdi_cap_account_writeback(bdi))
|
|
inc_wb_stat(inode_to_wb(inode), WB_WRITEBACK);
|
|
|
|
/*
|
|
* We can come through here when swapping anonymous
|
|
* pages, so we don't necessarily have an inode to track
|
|
* for sync.
|
|
*/
|
|
if (mapping->host && !on_wblist)
|
|
sb_mark_inode_writeback(mapping->host);
|
|
}
|
|
if (!PageDirty(page))
|
|
radix_tree_tag_clear(&mapping->page_tree,
|
|
page_index(page),
|
|
PAGECACHE_TAG_DIRTY);
|
|
if (!keep_write)
|
|
radix_tree_tag_clear(&mapping->page_tree,
|
|
page_index(page),
|
|
PAGECACHE_TAG_TOWRITE);
|
|
spin_unlock_irqrestore(&mapping->tree_lock, flags);
|
|
} else {
|
|
ret = TestSetPageWriteback(page);
|
|
}
|
|
if (!ret) {
|
|
inc_lruvec_page_state(page, NR_WRITEBACK);
|
|
inc_zone_page_state(page, NR_ZONE_WRITE_PENDING);
|
|
}
|
|
unlock_page_memcg(page);
|
|
return ret;
|
|
|
|
}
|
|
EXPORT_SYMBOL(__test_set_page_writeback);
|
|
|
|
/*
|
|
* Return true if any of the pages in the mapping are marked with the
|
|
* passed tag.
|
|
*/
|
|
int mapping_tagged(struct address_space *mapping, int tag)
|
|
{
|
|
return radix_tree_tagged(&mapping->page_tree, tag);
|
|
}
|
|
EXPORT_SYMBOL(mapping_tagged);
|
|
|
|
/**
|
|
* wait_for_stable_page() - wait for writeback to finish, if necessary.
|
|
* @page: The page to wait on.
|
|
*
|
|
* This function determines if the given page is related to a backing device
|
|
* that requires page contents to be held stable during writeback. If so, then
|
|
* it will wait for any pending writeback to complete.
|
|
*/
|
|
void wait_for_stable_page(struct page *page)
|
|
{
|
|
if (bdi_cap_stable_pages_required(inode_to_bdi(page->mapping->host)))
|
|
wait_on_page_writeback(page);
|
|
}
|
|
EXPORT_SYMBOL_GPL(wait_for_stable_page);
|