- 16 May, 2022 40 commits
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Filipe Manana authored
For hole punching and zero range we have this loop that checks if we have ordered extents after locking the file range, and if so unlock the range, wait for ordered extents, and retry until we don't find more ordered extents. This logic was needed in the past because: 1) Direct IO writes within the i_size boundary did not take the inode's VFS lock. This was because that lock used to be a mutex, then some years ago it was switched to a rw semaphore (commit 9902af79 ("parallel lookups: actual switch to rwsem")), and then btrfs was changed to take the VFS inode's lock in shared mode for writes that don't cross the i_size boundary (commit e9adabb9 ("btrfs: use shared lock for direct writes within EOF")); 2) We could race with memory mapped writes, because memory mapped writes don't acquire the inode's VFS lock. We don't have that race anymore, as we have a rw semaphore to synchronize memory mapped writes with fallocate (and reflinking too). That change happened with commit 8d9b4a16 ("btrfs: exclude mmap from happening during all fallocate operations"). So stop looking for ordered extents after locking the file range when doing hole punching and zero range operations. Signed-off-by:
Filipe Manana <fdmanana@suse.com> Signed-off-by:
David Sterba <dsterba@suse.com>
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Filipe Manana authored
When doing hole punching we are flushing delalloc and waiting for ordered extents to complete before locking the inode (VFS lock and the btrfs specific i_mmap_lock). This is fine because even if a write happens after we call btrfs_wait_ordered_range() and before we lock the inode (call btrfs_inode_lock()), we will notice the write at btrfs_punch_hole_lock_range() and flush delalloc and wait for its ordered extent. We can however make this simpler by locking first the inode an then call btrfs_wait_ordered_range(), which will allow us to remove the ordered extent lookup logic from btrfs_punch_hole_lock_range() in the next patch. It also makes the behaviour the same as plain fallocate, hole punching and reflinks. Signed-off-by:
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Filipe Manana authored
For fallocate() we have this loop that checks if we have ordered extents after locking the file range, and if so unlock the range, wait for ordered extents, and retry until we don't find more ordered extents. This logic was needed in the past because: 1) Direct IO writes within the i_size boundary did not take the inode's VFS lock. This was because that lock used to be a mutex, then some years ago it was switched to a rw semaphore (commit 9902af79 ("parallel lookups: actual switch to rwsem")), and then btrfs was changed to take the VFS inode's lock in shared mode for writes that don't cross the i_size boundary (commit e9adabb9 ("btrfs: use shared lock for direct writes within EOF")); 2) We could race with memory mapped writes, because memory mapped writes don't acquire the inode's VFS lock. We don't have that race anymore, as we have a rw semaphore to synchronize memory mapped writes with fallocate (and reflinking too). That change happened with commit 8d9b4a16 ("btrfs: exclude mmap from happening during all fallocate operations"). So stop looking for ordered extents after locking the file range when doing a plain fallocate. Signed-off-by:
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Filipe Manana authored
When starting a reflink operation we have these calls to inode_dio_wait() which used to be needed because direct IO writes that don't cross the i_size boundary did not take the inode's VFS lock, so we could race with them and end up with ordered extents in target range after calling btrfs_wait_ordered_range(). However that is not the case anymore, because the inode's VFS lock was changed from a mutex to a rw semaphore, by commit 9902af79 ("parallel lookups: actual switch to rwsem"), and several years later we started to lock the inode's VFS lock in shared mode for direct IO writes that don't cross the i_size boundary (commit e9adabb9 ("btrfs: use shared lock for direct writes within EOF")). So remove those inode_dio_wait() calls. Signed-off-by:
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Filipe Manana authored
When starting a fallocate zero range operation, before getting the first extent map for the range, we make a call to inode_dio_wait(). This logic was needed in the past because direct IO writes within the i_size boundary did not take the inode's VFS lock. This was because that lock used to be a mutex, then some years ago it was switched to a rw semaphore (by commit 9902af79 ("parallel lookups: actual switch to rwsem")), and then btrfs was changed to take the VFS inode's lock in shared mode for writes that don't cross the i_size boundary (done in commit e9adabb9 ("btrfs: use shared lock for direct writes within EOF")). The lockless direct IO writes could result in a race with the zero range operation, resulting in the later getting a stale extent map for the range. So remove this no longer needed call to inode_dio_wait(), as fallocate takes the inode's VFS lock in exclusive mode and direct IO writes within i_size take that same lock in shared mode. Signed-off-by:
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Filipe Manana authored
During a plain fallocate, we always start by reserving an amount of data space that matches the length of the range passed to fallocate. When we already have extents allocated in that range, we may end up trying to reserve a lot more data space then we need, which can result in several undesired behaviours: 1) We fail with -ENOSPC. For example the passed range has a length of 1G, but there's only one hole with a size of 1M in that range; 2) We temporarily reserve excessive data space that could be used by other operations happening concurrently; 3) By reserving much more data space then we need, we can end up doing expensive things like triggering dellaloc for other inodes, waiting for the ordered extents to complete, trigger transaction commits, allocate new block groups, etc. Example: $ cat test.sh #!/bin/bash DEV=/dev/sdj MNT=/mnt/sdj mkfs.btrfs -f -b 1g $DEV mount $DEV $MNT # Create a file with a size of 600M and two holes, one at [200M, 201M[ # and another at [401M, 402M[ xfs_io -f -c "pwrite -S 0xab 0 200M" \ -c "pwrite -S 0xcd 201M 200M" \ -c "pwrite -S 0xef 402M 198M" \ $MNT/foobar # Now call fallocate against the whole file range, see if it fails # with -ENOSPC or not - it shouldn't since we only need to allocate # 2M of data space. xfs_io -c "falloc 0 600M" $MNT/foobar umount $MNT $ ./test.sh (...) wrote 209715200/209715200 bytes at offset 0 200 MiB, 51200 ops; 0.8063 sec (248.026 MiB/sec and 63494.5831 ops/sec) wrote 209715200/209715200 bytes at offset 210763776 200 MiB, 51200 ops; 0.8053 sec (248.329 MiB/sec and 63572.3172 ops/sec) wrote 207618048/207618048 bytes at offset 421527552 198 MiB, 50688 ops; 0.7925 sec (249.830 MiB/sec and 63956.5548 ops/sec) fallocate: No space left on device $ So fix this by not allocating an amount of data space that matches the length of the range passed to fallocate. Instead allocate an amount of data space that corresponds to the sum of the sizes of each hole found in the range. This reservation now happens after we have locked the file range, which is safe since we know at this point there's no delalloc in the range because we've taken the inode's VFS lock in exclusive mode, we have taken the inode's i_mmap_lock in exclusive mode, we have flushed delalloc and waited for all ordered extents in the range to complete. This type of failure actually seems to happen in practice with systemd, and we had at least one report about this in a very long thread which is referenced by the Link tag below. Link: https://lore.kernel.org/linux-btrfs/bdJVxLiFr_PyQSXRUbZJfFW_jAjsGgoMetqPHJMbg-hdy54Xt_ZHhRetmnJ6cJ99eBlcX76wy-AvWwV715c3YndkxneSlod11P1hlaADx0s=@protonmail.com/Signed-off-by: -
Sweet Tea Dorminy authored
According to the tree checker, "all xattrs with a given objectid follow the inode with that objectid in the tree" is an invariant. This was broken by the recent change "btrfs: move common inode creation code into btrfs_create_new_inode()", which moved acl creation and property inheritance (stored in xattrs) to before inode insertion into the tree. As a result, under certain timings, the xattrs could be written to the tree before the inode, causing the tree checker to report violation of the invariant. Move property inheritance and acl creation back to their old ordering after the inode insertion. Suggested-by:
Omar Sandoval <osandov@osandov.com> Reported-by:
Naohiro Aota <naohiro.aota@wdc.com> Signed-off-by:
Sweet Tea Dorminy <sweettea-kernel@dorminy.me> Signed-off-by:
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Omar Sandoval authored
All of our inode creation code paths duplicate the calls to btrfs_init_inode_security() and btrfs_add_link(). Subvolume creation additionally duplicates property inheritance and the call to btrfs_set_inode_index(). Fix this by moving the common code into btrfs_create_new_inode(). This accomplishes a few things at once: 1. It reduces code duplication. 2. It allows us to set up the inode completely before inserting the inode item, removing calls to btrfs_update_inode(). 3. It fixes a leak of an inode on disk in some error cases. For example, in btrfs_create(), if btrfs_new_inode() succeeds, then we have inserted an inode item and its inode ref. However, if something after that fails (e.g., btrfs_init_inode_security()), then we end the transaction and then decrement the link count on the inode. If the transaction is committed and the system crashes before the failed inode is deleted, then we leak that inode on disk. Instead, this refactoring aborts the transaction when we can't recover more gracefully. 4. It exposes various ways that subvolume creation diverges from mkdir in terms of inheriting flags, properties, permissions, and POSIX ACLs, a lot of which appears to be accidental. This patch explicitly does _not_ change the existing non-standard behavior, but it makes those differences more clear in the code and documents them so that we can discuss whether they should be changed. Reviewed-by:
Omar Sandoval <osandov@fb.com> Signed-off-by:
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Omar Sandoval authored
The various inode creation code paths do not account for the compression property, POSIX ACLs, or the parent inode item when starting a transaction. Fix it by refactoring all of these code paths to use a new function, btrfs_new_inode_prepare(), which computes the correct number of items. To do so, it needs to know whether POSIX ACLs will be created, so move the ACL creation into that function. To reduce the number of arguments that need to be passed around for inode creation, define struct btrfs_new_inode_args containing all of the relevant information. btrfs_new_inode_prepare() will also be a good place to set up the fscrypt context and encrypted filename in the future. Reviewed-by:
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Omar Sandoval authored
btrfs_{mknod,create,mkdir}() are now identical other than the inode initialization and some inconsequential function call order differences. Factor out the common code to reduce code duplication. Reviewed-by: -
Omar Sandoval authored
Instead of calling new_inode() and inode_init_owner() inside of btrfs_new_inode(), do it in the callers. This allows us to pass in just the inode instead of the mnt_userns and mode and removes the need for memalloc_nofs_{save,restores}() since we do it before starting a transaction. In create_subvol(), it also means we no longer have to look up the inode again to instantiate it. This also paves the way for some more cleanups in later patches. This also removes the comments about Smack checking i_op, which are no longer true since commit 5d6c3191 ("xattr: Add __vfs_{get,set,remove}xattr helpers"). Now it checks inode->i_opflags & IOP_XATTR, which is set based on sb->s_xattr. Signed-off-by: -
Qu Wenruo authored
Although we have btrfs_extent_buffer_leak_debug_check() (enabled by CONFIG_BTRFS_DEBUG option) to detect and warn QA testers that we have some extent buffer leakage, it's just pr_err(), not noisy enough for fstests to cache. So here we trigger a WARN_ON() if the allocated_ebs list is not empty. Reviewed-by:
Qu Wenruo <wqu@suse.com> Reviewed-by:
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Anand Jain authored
In the function btrfs_dev_replace_finishing, we dereferenced fs_info->fs_devices 6 times. Use keep local variable for that. Reviewed-by:
Johannes Thumshirn <johannes.thumshirn@wdc.com> Signed-off-by:
Anand Jain <anand.jain@oracle.com> Reviewed-by:
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Gabriel Niebler authored
This function can be simplified by refactoring to use the new iterator macro. No functional changes. Signed-off-by:
Marcos Paulo de Souza <mpdesouza@suse.com> Signed-off-by:
Gabriel Niebler <gniebler@suse.com> Reviewed-by:
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Gabriel Niebler authored
This function can be simplified by refactoring to use the new iterator macro. No functional changes. Signed-off-by:
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Gabriel Niebler authored
This function can be simplified by refactoring to use the new iterator macro. No functional changes. Signed-off-by:
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Gabriel Niebler authored
This function can be simplified by refactoring to use the new iterator macro. No functional changes. Signed-off-by:
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Gabriel Niebler authored
This function can be simplified by refactoring to use the new iterator macro. No functional changes. Signed-off-by:
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Gabriel Niebler authored
This function can be simplified by refactoring to use the new iterator macro. No functional changes. Signed-off-by:
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Gabriel Niebler authored
This function can be simplified by refactoring to use the new iterator macro. No functional changes. Signed-off-by:
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Gabriel Niebler authored
This function can be simplified by refactoring to use the new iterator macro. No functional changes. Signed-off-by:
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Gabriel Niebler authored
This function can be simplified by refactoring to use the new iterator macro. No functional changes. Signed-off-by:
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Gabriel Niebler authored
This function can be simplified by refactoring to use the new iterator macro. No functional changes. Signed-off-by:
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Gabriel Niebler authored
This function can be simplified by refactoring to use the new iterator macro. No functional changes. Signed-off-by:
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Gabriel Niebler authored
This function can be simplified by refactoring to use the new iterator macro. No functional changes. Signed-off-by:
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Gabriel Niebler authored
This function can be simplified by refactoring to use the new iterator macro. No functional changes. Signed-off-by:
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Gabriel Niebler authored
There is a common pattern when searching for a key in btrfs: * Call btrfs_search_slot to find the slot for the key * Enter an endless loop: * If the found slot is larger than the no. of items in the current leaf, check the next leaf * If it's still not found in the next leaf, terminate the loop * Otherwise do something with the found key * Increment the current slot and continue To reduce code duplication, we can replace this code pattern with an iterator macro, similar to the existing for_each_X macros found elsewhere in the kernel. This also makes the code easier to understand for newcomers by putting a name to the encapsulated functionality. Signed-off-by: -
Qu Wenruo authored
Since the subpage support for scrub, one page no longer always represents one sector, thus scrub_bio::pagev and scrub_bio::sector_count are no longer accurate. Rename them to scrub_bio::sectors and scrub_bio::sector_count respectively. This also involves scrub_ctx::pages_per_bio and other macros involved. Now the renaming of pages involved in scrub is be finished. Signed-off-by:
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Qu Wenruo authored
Since the subpage support of scrub, scrub_sector is in fact just representing one sector. Thus the name scrub_page is no longer correct, rename it to scrub_sector. This also involves the following renames: - spage -> sector Normally we would just replace "page" with "sector" and result something like "ssector". But the repeating 's' is not really eye friendly. So here we just simple use "sector", as there is nothing from MM layer called "sector" to cause any confusion. - scrub_parity::spages -> sectors_list Normally we use plural to indicate an array, not a list. Rename it to @sectors_list to be more explicit on the list part. - Also reformat and update comments that get changed Signed-off-by:
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Qu Wenruo authored
The following will be renamed in this patch: - scrub_block::pagev -> sectors - scrub_block::page_count -> sector_count - SCRUB_MAX_PAGES_PER_BLOCK -> SCRUB_MAX_SECTORS_PER_BLOCK - page_num -> sector_num to iterate scrub_block::sectors For now scrub_page is not yet renamed to keep the patch reasonable and it will be updated in a followup. Signed-off-by:
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Filipe Manana authored
The function btrfs_read_buffer() is useless, it just calls btree_read_extent_buffer_pages() with exactly the same arguments. So remove it and rename btree_read_extent_buffer_pages() to btrfs_read_extent_buffer(), which is a shorter name, has the "btrfs_" prefix (since it's used outside disk-io.c) and the name is clear enough about what it does. Reviewed-by:
Josef Bacik <josef@toxicpanda.com> Signed-off-by:
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Filipe Manana authored
The comment at the top of read_block_for_search() is very outdated, as it refers to the blocking versus spinning path locking modes. We no longer have these two locking modes after we switched the btree locks from custom code to rw semaphores. So update the comment to stop referring to the blocking mode and put it more up to date. Reviewed-by:
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Filipe Manana authored
When reading a btree node (or leaf), at read_block_for_search(), if we can't find its extent buffer in the cache (the fs_info->buffer_radix radix tree), then we unlock all upper level nodes before reading the btree node/leaf from disk, to prevent blocking other tasks for too long. However if we find that the extent buffer is in the cache but it is not up to date, we don't unlock upper level nodes before reading it from disk, potentially blocking other tasks on upper level nodes for too long. Fix this inconsistent behaviour by unlocking upper level nodes if we need to read a node/leaf from disk because its in-memory extent buffer is not up to date. If we unlocked upper level nodes then we must return -EAGAIN to the caller, just like the case where the extent buffer is not cached in memory. And like that case, we determine if upper level nodes are locked by checking only if the parent node is locked - if it isn't, then no other upper level nodes are locked. This is actually a rare case, as if we have an extent buffer in memory, it typically has the uptodate flag set and passes all the checks done by btrfs_buffer_uptodate(). Reviewed-by:
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Filipe Manana authored
When reading a btree node, at read_block_for_search(), if we don't find the node's (or leaf) extent buffer in the cache, we will read it from disk. Since that requires waiting on IO, we release all upper level nodes from our path before reading the target node/leaf, and then return -EAGAIN to the caller, which will make the caller restart the while btree search. However we are causing the restart of btree search even for cases where it is not necessary: 1) We have a path with ->skip_locking set to true, typically when doing a search on a commit root, so we are never holding locks on any node; 2) We are doing a read search (the "ins_len" argument passed to btrfs_search_slot() is 0), or we are doing a search to modify an existing key (the "cow" argument passed to btrfs_search_slot() has a value of 1 and "ins_len" is 0), in which case we never hold locks for upper level nodes; 3) We are doing a search to insert or delete a key, in which case we may or may not have upper level nodes locked. That depends on the current minimum write lock levels at btrfs_search_slot(), if we had to split or merge parent nodes, if we had to COW upper level nodes and if we ever visited slot 0 of an upper level node. It's still common to not have upper level nodes locked, but our current node must be at least at level 1, for insertions, or at least at level 2 for deletions. In these cases when we have locks on upper level nodes, they are always write locks. These cases where we are not holding locks on upper level nodes far outweigh the cases where we are holding locks, so it's completely wasteful to retry the whole search when we have no upper nodes locked. So change the logic to not return -EAGAIN, and make the caller retry the search, when we don't have the parent node locked - when it's not locked it means no other upper level nodes are locked as well. Reviewed-by:
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Omar Sandoval authored
btrfs_new_inode() inherits the inode flags from the parent directory and the mount options _after_ we fill the inode item. This works because all of the callers of btrfs_new_inode() make further changes to the inode and then call btrfs_update_inode(). It'd be better to fully initialize the inode once to avoid the extra update, so as a first step, set the inode flags _before_ filling the inode item. Reviewed-by:
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Omar Sandoval authored
Every call of btrfs_new_inode() is immediately preceded by a call to btrfs_get_free_objectid(). Since getting an inode number is part of creating a new inode, this is better off being moved into btrfs_new_inode(). While we're here, get rid of the comment about reclaiming inode numbers, since we only did that when using the ino cache, which was removed by commit 5297199a ("btrfs: remove inode number cache feature"). Reviewed-by:
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Omar Sandoval authored
For everything other than a subvolume root inode, we get the parent objectid from the parent directory. For the subvolume root inode, the parent objectid is the same as the inode's objectid. We can find this within btrfs_new_inode() instead of passing it. Reviewed-by:
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Omar Sandoval authored
The passed dentry already contains the name. Reviewed-by:
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Omar Sandoval authored
Commit 4a8b34af ("btrfs: handle ACLs on idmapped mounts") added this parameter but didn't use it. __btrfs_set_acl() is the low-level helper that writes an ACL to disk. The higher-level btrfs_set_acl() is the one that translates the ACL based on the user namespace. Reviewed-by:
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Omar Sandoval authored
btrfs_new_inode() already returns an inode with nlink set to 1 (via inode_init_always()). Get rid of the unnecessary set. Reviewed-by:
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