WSL2-Linux-Kernel/fs/f2fs/node.h

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/* SPDX-License-Identifier: GPL-2.0 */
/*
* fs/f2fs/node.h
*
* Copyright (c) 2012 Samsung Electronics Co., Ltd.
* http://www.samsung.com/
*/
/* start node id of a node block dedicated to the given node id */
#define START_NID(nid) (((nid) / NAT_ENTRY_PER_BLOCK) * NAT_ENTRY_PER_BLOCK)
/* node block offset on the NAT area dedicated to the given start node id */
#define NAT_BLOCK_OFFSET(start_nid) ((start_nid) / NAT_ENTRY_PER_BLOCK)
/* # of pages to perform synchronous readahead before building free nids */
#define FREE_NID_PAGES 8
#define MAX_FREE_NIDS (NAT_ENTRY_PER_BLOCK * FREE_NID_PAGES)
/* size of free nid batch when shrinking */
#define SHRINK_NID_BATCH_SIZE 8
#define DEF_RA_NID_PAGES 0 /* # of nid pages to be readaheaded */
/* maximum readahead size for node during getting data blocks */
#define MAX_RA_NODE 128
/* control the memory footprint threshold (10MB per 1GB ram) */
#define DEF_RAM_THRESHOLD 1
/* control dirty nats ratio threshold (default: 10% over max nid count) */
#define DEF_DIRTY_NAT_RATIO_THRESHOLD 10
/* control total # of nats */
#define DEF_NAT_CACHE_THRESHOLD 100000
/* vector size for gang look-up from nat cache that consists of radix tree */
#define NATVEC_SIZE 64
#define SETVEC_SIZE 32
/* return value for read_node_page */
#define LOCKED_PAGE 1
f2fs: swap: support migrating swapfile in aligned write mode This patch supports to migrate swapfile in aligned write mode during swapon in order to keep swapfile being aligned to section as much as possible, then pinned swapfile will locates fully filled section which may not affected by GC. However, for the case that swapfile's size is not aligned to section size, it will still leave last extent in file's tail as unaligned due to its size is smaller than section size, like case #2. case #1 xfs_io -f /mnt/f2fs/file -c "pwrite 0 4M" -c "fsync" Before swapon: EXT: FILE-OFFSET BLOCK-RANGE TOTAL FLAGS 0: [0..3047]: 1123352..1126399 3048 0x1000 1: [3048..7143]: 237568..241663 4096 0x1000 2: [7144..8191]: 245760..246807 1048 0x1001 After swapon: EXT: FILE-OFFSET BLOCK-RANGE TOTAL FLAGS 0: [0..8191]: 249856..258047 8192 0x1001 Kmsg: F2FS-fs (zram0): Swapfile (2) is not align to section: 1) creat(), 2) ioctl(F2FS_IOC_SET_PIN_FILE), 3) fallocate(2097152 * n) case #2 xfs_io -f /mnt/f2fs/file -c "pwrite 0 3M" -c "fsync" Before swapon: EXT: FILE-OFFSET BLOCK-RANGE TOTAL FLAGS 0: [0..3047]: 246808..249855 3048 0x1000 1: [3048..6143]: 237568..240663 3096 0x1001 After swapon: EXT: FILE-OFFSET BLOCK-RANGE TOTAL FLAGS 0: [0..4095]: 258048..262143 4096 0x1000 1: [4096..6143]: 238616..240663 2048 0x1001 Kmsg: F2FS-fs (zram0): Swapfile: last extent is not aligned to section F2FS-fs (zram0): Swapfile (2) is not align to section: 1) creat(), 2) ioctl(F2FS_IOC_SET_PIN_FILE), 3) fallocate(2097152 * n) Signed-off-by: Chao Yu <yuchao0@huawei.com> Signed-off-by: Jaegeuk Kim <jaegeuk@kernel.org>
2021-05-26 09:29:27 +03:00
/* check pinned file's alignment status of physical blocks */
#define FILE_NOT_ALIGNED 1
/* For flag in struct node_info */
enum {
IS_CHECKPOINTED, /* is it checkpointed before? */
HAS_FSYNCED_INODE, /* is the inode fsynced before? */
HAS_LAST_FSYNC, /* has the latest node fsync mark? */
IS_DIRTY, /* this nat entry is dirty? */
IS_PREALLOC, /* nat entry is preallocated */
};
/*
* For node information
*/
struct node_info {
nid_t nid; /* node id */
nid_t ino; /* inode number of the node's owner */
block_t blk_addr; /* block address of the node */
unsigned char version; /* version of the node */
unsigned char flag; /* for node information bits */
};
struct nat_entry {
struct list_head list; /* for clean or dirty nat list */
struct node_info ni; /* in-memory node information */
};
#define nat_get_nid(nat) ((nat)->ni.nid)
#define nat_set_nid(nat, n) ((nat)->ni.nid = (n))
#define nat_get_blkaddr(nat) ((nat)->ni.blk_addr)
#define nat_set_blkaddr(nat, b) ((nat)->ni.blk_addr = (b))
#define nat_get_ino(nat) ((nat)->ni.ino)
#define nat_set_ino(nat, i) ((nat)->ni.ino = (i))
#define nat_get_version(nat) ((nat)->ni.version)
#define nat_set_version(nat, v) ((nat)->ni.version = (v))
#define inc_node_version(version) (++(version))
static inline void copy_node_info(struct node_info *dst,
struct node_info *src)
{
dst->nid = src->nid;
dst->ino = src->ino;
dst->blk_addr = src->blk_addr;
dst->version = src->version;
/* should not copy flag here */
}
static inline void set_nat_flag(struct nat_entry *ne,
unsigned int type, bool set)
{
unsigned char mask = 0x01 << type;
if (set)
ne->ni.flag |= mask;
else
ne->ni.flag &= ~mask;
}
static inline bool get_nat_flag(struct nat_entry *ne, unsigned int type)
{
unsigned char mask = 0x01 << type;
return ne->ni.flag & mask;
}
f2fs: fix conditions to remain recovery information in f2fs_sync_file This patch revisited whole the recovery information during the f2fs_sync_file. In this patch, there are three information to make a decision. a) IS_CHECKPOINTED, /* is it checkpointed before? */ b) HAS_FSYNCED_INODE, /* is the inode fsynced before? */ c) HAS_LAST_FSYNC, /* has the latest node fsync mark? */ And, the scenarios for our rule are based on: [Term] F: fsync_mark, D: dentry_mark 1. inode(x) | CP | inode(x) | dnode(F) 2. inode(x) | CP | inode(F) | dnode(F) 3. inode(x) | CP | dnode(F) | inode(x) | inode(F) 4. inode(x) | CP | dnode(F) | inode(F) 5. CP | inode(x) | dnode(F) | inode(DF) 6. CP | inode(DF) | dnode(F) 7. CP | dnode(F) | inode(DF) 8. CP | dnode(F) | inode(x) | inode(DF) For example, #3, the three conditions should be changed as follows. inode(x) | CP | dnode(F) | inode(x) | inode(F) a) x o o o o b) x x x x o c) x o o x o If f2fs_sync_file stops ------^, it should write inode(F) --------------^ So, the need_inode_block_update should return true, since c) get_nat_flag(e, HAS_LAST_FSYNC), is false. For example, #8, CP | alloc | dnode(F) | inode(x) | inode(DF) a) o x x x x b) x x x o c) o o x o If f2fs_sync_file stops -------^, it should write inode(DF) --------------^ Note that, the roll-forward policy should follow this rule, which means, if there are any missing blocks, we doesn't need to recover that inode. Signed-off-by: Huang Ying <ying.huang@intel.com> Signed-off-by: Jaegeuk Kim <jaegeuk@kernel.org>
2014-09-16 01:50:48 +04:00
static inline void nat_reset_flag(struct nat_entry *ne)
{
/* these states can be set only after checkpoint was done */
set_nat_flag(ne, IS_CHECKPOINTED, true);
set_nat_flag(ne, HAS_FSYNCED_INODE, false);
set_nat_flag(ne, HAS_LAST_FSYNC, true);
}
static inline void node_info_from_raw_nat(struct node_info *ni,
struct f2fs_nat_entry *raw_ne)
{
ni->ino = le32_to_cpu(raw_ne->ino);
ni->blk_addr = le32_to_cpu(raw_ne->block_addr);
ni->version = raw_ne->version;
}
static inline void raw_nat_from_node_info(struct f2fs_nat_entry *raw_ne,
struct node_info *ni)
{
raw_ne->ino = cpu_to_le32(ni->ino);
raw_ne->block_addr = cpu_to_le32(ni->blk_addr);
raw_ne->version = ni->version;
}
static inline bool excess_dirty_nats(struct f2fs_sb_info *sbi)
{
return NM_I(sbi)->nat_cnt[DIRTY_NAT] >= NM_I(sbi)->max_nid *
NM_I(sbi)->dirty_nats_ratio / 100;
}
static inline bool excess_cached_nats(struct f2fs_sb_info *sbi)
{
return NM_I(sbi)->nat_cnt[TOTAL_NAT] >= DEF_NAT_CACHE_THRESHOLD;
}
static inline bool excess_dirty_nodes(struct f2fs_sb_info *sbi)
{
return get_pages(sbi, F2FS_DIRTY_NODES) >= sbi->blocks_per_seg * 8;
}
enum mem_type {
FREE_NIDS, /* indicates the free nid list */
NAT_ENTRIES, /* indicates the cached nat entry */
DIRTY_DENTS, /* indicates dirty dentry pages */
INO_ENTRIES, /* indicates inode entries */
EXTENT_CACHE, /* indicates extent cache */
INMEM_PAGES, /* indicates inmemory pages */
DISCARD_CACHE, /* indicates memory of cached discard cmds */
COMPRESS_PAGE, /* indicates memory of cached compressed pages */
BASE_CHECK, /* check kernel status */
};
f2fs: refactor flush_nat_entries codes for reducing NAT writes Although building NAT journal in cursum reduce the read/write work for NAT block, but previous design leave us lower performance when write checkpoint frequently for these cases: 1. if journal in cursum has already full, it's a bit of waste that we flush all nat entries to page for persistence, but not to cache any entries. 2. if journal in cursum is not full, we fill nat entries to journal util journal is full, then flush the left dirty entries to disk without merge journaled entries, so these journaled entries may be flushed to disk at next checkpoint but lost chance to flushed last time. In this patch we merge dirty entries located in same NAT block to nat entry set, and linked all set to list, sorted ascending order by entries' count of set. Later we flush entries in sparse set into journal as many as we can, and then flush merged entries to disk. In this way we can not only gain in performance, but also save lifetime of flash device. In my testing environment, it shows this patch can help to reduce NAT block writes obviously. In hard disk test case: cost time of fsstress is stablely reduced by about 5%. 1. virtual machine + hard disk: fsstress -p 20 -n 200 -l 5 node num cp count nodes/cp based 4599.6 1803.0 2.551 patched 2714.6 1829.6 1.483 2. virtual machine + 32g micro SD card: fsstress -p 20 -n 200 -l 1 -w -f chown=0 -f creat=4 -f dwrite=0 -f fdatasync=4 -f fsync=4 -f link=0 -f mkdir=4 -f mknod=4 -f rename=5 -f rmdir=5 -f symlink=0 -f truncate=4 -f unlink=5 -f write=0 -S node num cp count nodes/cp based 84.5 43.7 1.933 patched 49.2 40.0 1.23 Our latency of merging op shows not bad when handling extreme case like: merging a great number of dirty nats: latency(ns) dirty nat count 3089219 24922 5129423 27422 4000250 24523 change log from v1: o fix wrong logic in add_nat_entry when grab a new nat entry set. o swith to create slab cache in create_node_manager_caches. o use GFP_ATOMIC instead of GFP_NOFS to avoid potential long latency. change log from v2: o make comment position more appropriate suggested by Jaegeuk Kim. Signed-off-by: Chao Yu <chao2.yu@samsung.com> Signed-off-by: Jaegeuk Kim <jaegeuk@kernel.org>
2014-06-24 05:18:20 +04:00
struct nat_entry_set {
struct list_head set_list; /* link with other nat sets */
f2fs: refactor flush_nat_entries codes for reducing NAT writes Although building NAT journal in cursum reduce the read/write work for NAT block, but previous design leave us lower performance when write checkpoint frequently for these cases: 1. if journal in cursum has already full, it's a bit of waste that we flush all nat entries to page for persistence, but not to cache any entries. 2. if journal in cursum is not full, we fill nat entries to journal util journal is full, then flush the left dirty entries to disk without merge journaled entries, so these journaled entries may be flushed to disk at next checkpoint but lost chance to flushed last time. In this patch we merge dirty entries located in same NAT block to nat entry set, and linked all set to list, sorted ascending order by entries' count of set. Later we flush entries in sparse set into journal as many as we can, and then flush merged entries to disk. In this way we can not only gain in performance, but also save lifetime of flash device. In my testing environment, it shows this patch can help to reduce NAT block writes obviously. In hard disk test case: cost time of fsstress is stablely reduced by about 5%. 1. virtual machine + hard disk: fsstress -p 20 -n 200 -l 5 node num cp count nodes/cp based 4599.6 1803.0 2.551 patched 2714.6 1829.6 1.483 2. virtual machine + 32g micro SD card: fsstress -p 20 -n 200 -l 1 -w -f chown=0 -f creat=4 -f dwrite=0 -f fdatasync=4 -f fsync=4 -f link=0 -f mkdir=4 -f mknod=4 -f rename=5 -f rmdir=5 -f symlink=0 -f truncate=4 -f unlink=5 -f write=0 -S node num cp count nodes/cp based 84.5 43.7 1.933 patched 49.2 40.0 1.23 Our latency of merging op shows not bad when handling extreme case like: merging a great number of dirty nats: latency(ns) dirty nat count 3089219 24922 5129423 27422 4000250 24523 change log from v1: o fix wrong logic in add_nat_entry when grab a new nat entry set. o swith to create slab cache in create_node_manager_caches. o use GFP_ATOMIC instead of GFP_NOFS to avoid potential long latency. change log from v2: o make comment position more appropriate suggested by Jaegeuk Kim. Signed-off-by: Chao Yu <chao2.yu@samsung.com> Signed-off-by: Jaegeuk Kim <jaegeuk@kernel.org>
2014-06-24 05:18:20 +04:00
struct list_head entry_list; /* link with dirty nat entries */
nid_t set; /* set number*/
f2fs: refactor flush_nat_entries codes for reducing NAT writes Although building NAT journal in cursum reduce the read/write work for NAT block, but previous design leave us lower performance when write checkpoint frequently for these cases: 1. if journal in cursum has already full, it's a bit of waste that we flush all nat entries to page for persistence, but not to cache any entries. 2. if journal in cursum is not full, we fill nat entries to journal util journal is full, then flush the left dirty entries to disk without merge journaled entries, so these journaled entries may be flushed to disk at next checkpoint but lost chance to flushed last time. In this patch we merge dirty entries located in same NAT block to nat entry set, and linked all set to list, sorted ascending order by entries' count of set. Later we flush entries in sparse set into journal as many as we can, and then flush merged entries to disk. In this way we can not only gain in performance, but also save lifetime of flash device. In my testing environment, it shows this patch can help to reduce NAT block writes obviously. In hard disk test case: cost time of fsstress is stablely reduced by about 5%. 1. virtual machine + hard disk: fsstress -p 20 -n 200 -l 5 node num cp count nodes/cp based 4599.6 1803.0 2.551 patched 2714.6 1829.6 1.483 2. virtual machine + 32g micro SD card: fsstress -p 20 -n 200 -l 1 -w -f chown=0 -f creat=4 -f dwrite=0 -f fdatasync=4 -f fsync=4 -f link=0 -f mkdir=4 -f mknod=4 -f rename=5 -f rmdir=5 -f symlink=0 -f truncate=4 -f unlink=5 -f write=0 -S node num cp count nodes/cp based 84.5 43.7 1.933 patched 49.2 40.0 1.23 Our latency of merging op shows not bad when handling extreme case like: merging a great number of dirty nats: latency(ns) dirty nat count 3089219 24922 5129423 27422 4000250 24523 change log from v1: o fix wrong logic in add_nat_entry when grab a new nat entry set. o swith to create slab cache in create_node_manager_caches. o use GFP_ATOMIC instead of GFP_NOFS to avoid potential long latency. change log from v2: o make comment position more appropriate suggested by Jaegeuk Kim. Signed-off-by: Chao Yu <chao2.yu@samsung.com> Signed-off-by: Jaegeuk Kim <jaegeuk@kernel.org>
2014-06-24 05:18:20 +04:00
unsigned int entry_cnt; /* the # of nat entries in set */
};
struct free_nid {
struct list_head list; /* for free node id list */
nid_t nid; /* node id */
int state; /* in use or not: FREE_NID or PREALLOC_NID */
};
static inline void next_free_nid(struct f2fs_sb_info *sbi, nid_t *nid)
{
struct f2fs_nm_info *nm_i = NM_I(sbi);
struct free_nid *fnid;
spin_lock(&nm_i->nid_list_lock);
if (nm_i->nid_cnt[FREE_NID] <= 0) {
spin_unlock(&nm_i->nid_list_lock);
return;
}
fnid = list_first_entry(&nm_i->free_nid_list, struct free_nid, list);
*nid = fnid->nid;
spin_unlock(&nm_i->nid_list_lock);
}
/*
* inline functions
*/
static inline void get_nat_bitmap(struct f2fs_sb_info *sbi, void *addr)
{
struct f2fs_nm_info *nm_i = NM_I(sbi);
#ifdef CONFIG_F2FS_CHECK_FS
if (memcmp(nm_i->nat_bitmap, nm_i->nat_bitmap_mir,
nm_i->bitmap_size))
f2fs_bug_on(sbi, 1);
#endif
memcpy(addr, nm_i->nat_bitmap, nm_i->bitmap_size);
}
static inline pgoff_t current_nat_addr(struct f2fs_sb_info *sbi, nid_t start)
{
struct f2fs_nm_info *nm_i = NM_I(sbi);
pgoff_t block_off;
pgoff_t block_addr;
/*
* block_off = segment_off * 512 + off_in_segment
* OLD = (segment_off * 512) * 2 + off_in_segment
* NEW = 2 * (segment_off * 512 + off_in_segment) - off_in_segment
*/
block_off = NAT_BLOCK_OFFSET(start);
block_addr = (pgoff_t)(nm_i->nat_blkaddr +
(block_off << 1) -
(block_off & (sbi->blocks_per_seg - 1)));
if (f2fs_test_bit(block_off, nm_i->nat_bitmap))
block_addr += sbi->blocks_per_seg;
return block_addr;
}
static inline pgoff_t next_nat_addr(struct f2fs_sb_info *sbi,
pgoff_t block_addr)
{
struct f2fs_nm_info *nm_i = NM_I(sbi);
block_addr -= nm_i->nat_blkaddr;
block_addr ^= 1 << sbi->log_blocks_per_seg;
return block_addr + nm_i->nat_blkaddr;
}
static inline void set_to_next_nat(struct f2fs_nm_info *nm_i, nid_t start_nid)
{
unsigned int block_off = NAT_BLOCK_OFFSET(start_nid);
f2fs_change_bit(block_off, nm_i->nat_bitmap);
#ifdef CONFIG_F2FS_CHECK_FS
f2fs_change_bit(block_off, nm_i->nat_bitmap_mir);
#endif
}
static inline nid_t ino_of_node(struct page *node_page)
{
struct f2fs_node *rn = F2FS_NODE(node_page);
return le32_to_cpu(rn->footer.ino);
}
static inline nid_t nid_of_node(struct page *node_page)
{
struct f2fs_node *rn = F2FS_NODE(node_page);
return le32_to_cpu(rn->footer.nid);
}
static inline unsigned int ofs_of_node(struct page *node_page)
{
struct f2fs_node *rn = F2FS_NODE(node_page);
unsigned flag = le32_to_cpu(rn->footer.flag);
return flag >> OFFSET_BIT_SHIFT;
}
static inline __u64 cpver_of_node(struct page *node_page)
{
struct f2fs_node *rn = F2FS_NODE(node_page);
return le64_to_cpu(rn->footer.cp_ver);
}
static inline block_t next_blkaddr_of_node(struct page *node_page)
{
struct f2fs_node *rn = F2FS_NODE(node_page);
return le32_to_cpu(rn->footer.next_blkaddr);
}
static inline void fill_node_footer(struct page *page, nid_t nid,
nid_t ino, unsigned int ofs, bool reset)
{
struct f2fs_node *rn = F2FS_NODE(page);
unsigned int old_flag = 0;
if (reset)
memset(rn, 0, sizeof(*rn));
else
old_flag = le32_to_cpu(rn->footer.flag);
rn->footer.nid = cpu_to_le32(nid);
rn->footer.ino = cpu_to_le32(ino);
/* should remain old flag bits such as COLD_BIT_SHIFT */
rn->footer.flag = cpu_to_le32((ofs << OFFSET_BIT_SHIFT) |
(old_flag & OFFSET_BIT_MASK));
}
static inline void copy_node_footer(struct page *dst, struct page *src)
{
struct f2fs_node *src_rn = F2FS_NODE(src);
struct f2fs_node *dst_rn = F2FS_NODE(dst);
memcpy(&dst_rn->footer, &src_rn->footer, sizeof(struct node_footer));
}
static inline void fill_node_footer_blkaddr(struct page *page, block_t blkaddr)
{
struct f2fs_checkpoint *ckpt = F2FS_CKPT(F2FS_P_SB(page));
struct f2fs_node *rn = F2FS_NODE(page);
__u64 cp_ver = cur_cp_version(ckpt);
if (__is_set_ckpt_flags(ckpt, CP_CRC_RECOVERY_FLAG))
cp_ver |= (cur_cp_crc(ckpt) << 32);
rn->footer.cp_ver = cpu_to_le64(cp_ver);
rn->footer.next_blkaddr = cpu_to_le32(blkaddr);
}
static inline bool is_recoverable_dnode(struct page *page)
{
struct f2fs_checkpoint *ckpt = F2FS_CKPT(F2FS_P_SB(page));
__u64 cp_ver = cur_cp_version(ckpt);
/* Don't care crc part, if fsck.f2fs sets it. */
if (__is_set_ckpt_flags(ckpt, CP_NOCRC_RECOVERY_FLAG))
return (cp_ver << 32) == (cpver_of_node(page) << 32);
if (__is_set_ckpt_flags(ckpt, CP_CRC_RECOVERY_FLAG))
cp_ver |= (cur_cp_crc(ckpt) << 32);
return cp_ver == cpver_of_node(page);
}
/*
* f2fs assigns the following node offsets described as (num).
* N = NIDS_PER_BLOCK
*
* Inode block (0)
* |- direct node (1)
* |- direct node (2)
* |- indirect node (3)
* | `- direct node (4 => 4 + N - 1)
* |- indirect node (4 + N)
* | `- direct node (5 + N => 5 + 2N - 1)
* `- double indirect node (5 + 2N)
* `- indirect node (6 + 2N)
* `- direct node
* ......
* `- indirect node ((6 + 2N) + x(N + 1))
* `- direct node
* ......
* `- indirect node ((6 + 2N) + (N - 1)(N + 1))
* `- direct node
*/
static inline bool IS_DNODE(struct page *node_page)
{
unsigned int ofs = ofs_of_node(node_page);
if (f2fs_has_xattr_block(ofs))
return true;
if (ofs == 3 || ofs == 4 + NIDS_PER_BLOCK ||
ofs == 5 + 2 * NIDS_PER_BLOCK)
return false;
if (ofs >= 6 + 2 * NIDS_PER_BLOCK) {
ofs -= 6 + 2 * NIDS_PER_BLOCK;
if (!((long int)ofs % (NIDS_PER_BLOCK + 1)))
return false;
}
return true;
}
static inline int set_nid(struct page *p, int off, nid_t nid, bool i)
{
struct f2fs_node *rn = F2FS_NODE(p);
f2fs_wait_on_page_writeback(p, NODE, true, true);
if (i)
rn->i.i_nid[off - NODE_DIR1_BLOCK] = cpu_to_le32(nid);
else
rn->in.nid[off] = cpu_to_le32(nid);
return set_page_dirty(p);
}
static inline nid_t get_nid(struct page *p, int off, bool i)
{
struct f2fs_node *rn = F2FS_NODE(p);
if (i)
return le32_to_cpu(rn->i.i_nid[off - NODE_DIR1_BLOCK]);
return le32_to_cpu(rn->in.nid[off]);
}
/*
* Coldness identification:
* - Mark cold files in f2fs_inode_info
* - Mark cold node blocks in their node footer
* - Mark cold data pages in page cache
*/
static inline int is_node(struct page *page, int type)
{
struct f2fs_node *rn = F2FS_NODE(page);
return le32_to_cpu(rn->footer.flag) & (1 << type);
}
#define is_cold_node(page) is_node(page, COLD_BIT_SHIFT)
#define is_fsync_dnode(page) is_node(page, FSYNC_BIT_SHIFT)
#define is_dent_dnode(page) is_node(page, DENT_BIT_SHIFT)
static inline void set_cold_node(struct page *page, bool is_dir)
{
struct f2fs_node *rn = F2FS_NODE(page);
unsigned int flag = le32_to_cpu(rn->footer.flag);
if (is_dir)
flag &= ~(0x1 << COLD_BIT_SHIFT);
else
flag |= (0x1 << COLD_BIT_SHIFT);
rn->footer.flag = cpu_to_le32(flag);
}
static inline void set_mark(struct page *page, int mark, int type)
{
struct f2fs_node *rn = F2FS_NODE(page);
unsigned int flag = le32_to_cpu(rn->footer.flag);
if (mark)
flag |= (0x1 << type);
else
flag &= ~(0x1 << type);
rn->footer.flag = cpu_to_le32(flag);
#ifdef CONFIG_F2FS_CHECK_FS
f2fs_inode_chksum_set(F2FS_P_SB(page), page);
#endif
}
#define set_dentry_mark(page, mark) set_mark(page, mark, DENT_BIT_SHIFT)
#define set_fsync_mark(page, mark) set_mark(page, mark, FSYNC_BIT_SHIFT)