- 25 May, 2020 40 commits
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David Sterba authored
The fallback path calls helper read_extent_buffer to do read of the data spanning two extent buffer pages. As the size is known, we can do the read directly in two steps. This removes one function call and compiler can optimize memcpy as the sizes are known at compile time. The cached token address is set to the second page. Reviewed-by:
Johannes Thumshirn <johannes.thumshirn@wdc.com> Signed-off-by:
David Sterba <dsterba@suse.com>
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David Sterba authored
The helper read_extent_buffer is called to do read of the data spanning two extent buffer pages. As the size is known, we can do the read directly in two steps. This removes one function call and compiler can optimize memcpy as the sizes are known at compile time. Reviewed-by:
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David Sterba authored
Helpers that iterate over extent buffer pages set up several variables, one of them is finding out offset of the extent buffer start within a page. Right now we have extent buffers aligned to page sizes so this is effectively storing zero. This makes the code harder the follow and can be simplified. The same change is done in all the helpers: * remove: size_t start_offset = offset_in_page(eb->start); * simplify code using start_offset Reviewed-by:
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David Sterba authored
There are many helpers around extent buffers, found in extent_io.h and ctree.h. Most of them can be converted to take constified eb as there are no changes to the extent buffer structure itself but rather the pages. Reviewed-by:
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David Sterba authored
All uses of map_private_extent_buffer have been replaced by more effective way. The set/get helpers have their own bounds checker. The function name was confusing since the non-private helper was removed in a6591715 ("Btrfs: stop using highmem for extent_buffers") many years ago. Reviewed-by:
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David Sterba authored
The bin search jumps over the extent buffer item keys, comparing directly the bytes if the key is in one page, or storing it in a temporary buffer in case it spans two pages. The mapping start and length are obtained from map_private_extent_buffer, which is heavy weight compared to what we need. We know the key size and can find out the eb page in a simple way. For keys spanning two pages the fallback read_extent_buffer is used. The temporary variables are reduced and moved to the scope of use. Reviewed-by:
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David Sterba authored
The set/get token helpers either use the cached address in the token or unconditionally call map_private_extent_buffer to get the address of page containing the requested offset plus the mapping start and length. Depending on the return value, the fast path uses unaligned put to write data within a page, or fall back to write_extent_buffer that can handle writes spanning more pages. This is all wasteful. We know the number of bytes to write, 1/2/4/8 and can find out the page. Then simply check if it's contained or the fallback is needed. The token address is updated to the page, or the on the next index, expecting that the next write will use that. This saves one function call to map_private_extent_buffer and several unnecessary temporary variables. Reviewed-by:
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David Sterba authored
The helpers unconditionally call map_private_extent_buffer to get the address of page containing the requested offset plus the mapping start and length. Depending on the return value, the fast path uses unaligned put to write data within a page, or fall back to write_extent_buffer that can handle writes spanning more pages. This is all wasteful. We know the number of bytes to write, 1/2/4/8 and can find out the page. Then simply check if it's contained or the fallback is needed. This saves one function call to map_private_extent_buffer and several unnecessary temporary variables. Reviewed-by:
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David Sterba authored
The set/get token helpers either use the cached address in the token or unconditionally call map_private_extent_buffer to get the address of page containing the requested offset plus the mapping start and length. Depending on the return value, the fast path uses unaligned read to get data within a page, or fall back to read_extent_buffer that can handle reads spanning more pages. This is all wasteful. We know the number of bytes to read, 1/2/4/8 and can find out the page. Then simply check if it's contained or the fallback is needed. The token address is updated to the page, or the on the next index, expecting that the next read will use that. This saves one function call to map_private_extent_buffer and several unnecessary temporary variables. Reviewed-by:
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David Sterba authored
The helpers unconditionally call map_private_extent_buffer to get the address of page containing the requested offset plus the mapping start and length. Depending on the return value, the fast path uses unaligned read to get data within a page, or fall back to read_extent_buffer that can handle reads spanning more pages. This is all wasteful. We know the number of bytes to read, 1/2/4/8 and can find out the page. Then simply check if it's contained or the fallback is needed. This saves one function call to map_private_extent_buffer and several unnecessary temporary variables. Reviewed-by:
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David Sterba authored
The bounds checking is now done in map_private_extent_buffer but that will be removed in following patches and some sanity checks should still be done. There are two separate checks to see the kind of out of bounds access: partial (start offset is in the buffer) or complete (both start and end are out). Reviewed-by:
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David Sterba authored
All the set/get helpers first check if the token contains a cached address. After first use the address is always valid, but the extra check is done for each call. The token initialization can optimistically set it to the first extent buffer page, that we know always exists. Then the condition in all btrfs_token_*/btrfs_set_token_* can be simplified by removing the address check from the condition, but for development the assertion still makes sure it's valid. Reviewed-by:
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David Sterba authored
The token is supposed to cache the last page used by the set/get helpers. In leaf_space_used the first and last items are accessed, it's not likely they'd be on the same page so there's some overhead caused updating the token address but not using it. Reviewed-by:
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David Sterba authored
The set/get token is supposed to cache the last page that was accessed so it speeds up subsequential access to the eb. It does not make sense to use that for just one change, which is the case of inode size in overwrite_item. Reviewed-by:
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David Sterba authored
Now that all set/get helpers use the eb from the token, we don't need to pass it to many btrfs_token_*/btrfs_set_token_* helpers, saving some stack space. Reviewed-by:
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David Sterba authored
The token stores a copy of the extent buffer pointer but does not make any use of it besides sanity checks. We can use it and drop the eb parameter from several functions, this patch only switches the use inside the set/get helpers. Reviewed-by:
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Tiezhu Yang authored
disk-io.h is included more than once in block-group.c, remove it. Reviewed-by:
Tiezhu Yang <yangtiezhu@loongson.cn> Signed-off-by:
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Qu Wenruo authored
The name of this function contains the word "cache", which is left from the times where btrfs_block_group was called btrfs_block_group_cache. Now this "cache" doesn't match anything, and we have better namings for functions like read/insert/remove_block_group_item(). Rename it to update_block_group_item(). Reviewed-by:
Qu Wenruo <wqu@suse.com> Reviewed-by:
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Qu Wenruo authored
Currently the block group item insert is pretty straight forward, fill the block group item structure and insert it into extent tree. However the incoming skinny block group feature is going to change this, so this patch will refactor insertion into a new function, insert_block_group_item(), to make the incoming feature easier to add. Reviewed-by:
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Qu Wenruo authored
When deleting a block group item, it's pretty straight forward, just delete the item pointed by the key. However it will not be that straight-forward for incoming skinny block group item. So refactor the block group item deletion into a new function, remove_block_group_item(), also to make the already lengthy btrfs_remove_block_group() a little shorter. Reviewed-by:
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Qu Wenruo authored
Structure btrfs_block_group has the following members which are currently read from on-disk block group item and key: - length - from item key - used - flags - from block group item However for incoming skinny block group tree, we are going to read those members from different sources. This patch will refactor such read by: - Don't initialize btrfs_block_group::length at allocation Caller should initialize them manually. Also to avoid possible (well, only two callers) missing initialization, add extra ASSERT() in btrfs_add_block_group_cache(). - Refactor length/used/flags initialization into one function The new function, fill_one_block_group() will handle the initialization of such members. - Use btrfs_block_group::length to replace key::offset Since skinny block group item would have a different meaning for its key offset. Signed-off-by:
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Qu Wenruo authored
Regular block group items in extent tree are scattered inside the huge tree, thus forward readahead makes no sense. Signed-off-by:
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Marcos Paulo de Souza authored
Whenever a chown is executed, all capabilities of the file being touched are lost. When doing incremental send with a file with capabilities, there is a situation where the capability can be lost on the receiving side. The sequence of actions bellow shows the problem: $ mount /dev/sda fs1 $ mount /dev/sdb fs2 $ touch fs1/foo.bar $ setcap cap_sys_nice+ep fs1/foo.bar $ btrfs subvolume snapshot -r fs1 fs1/snap_init $ btrfs send fs1/snap_init | btrfs receive fs2 $ chgrp adm fs1/foo.bar $ setcap cap_sys_nice+ep fs1/foo.bar $ btrfs subvolume snapshot -r fs1 fs1/snap_complete $ btrfs subvolume snapshot -r fs1 fs1/snap_incremental $ btrfs send fs1/snap_complete | btrfs receive fs2 $ btrfs send -p fs1/snap_init fs1/snap_incremental | btrfs receive fs2 At this point, only a chown was emitted by "btrfs send" since only the group was changed. This makes the cap_sys_nice capability to be dropped from fs2/snap_incremental/foo.bar To fix that, only emit capabilities after chown is emitted. The current code first checks for xattrs that are new/changed, emits them, and later emit the chown. Now, __process_new_xattr skips capabilities, letting only finish_inode_if_needed to emit them, if they exist, for the inode being processed. This behavior was being worked around in "btrfs receive" side by caching the capability and only applying it after chown. Now, xattrs are only emmited _after_ chown, making that workaround not needed anymore. Link: https://github.com/kdave/btrfs-progs/issues/202 CC: stable@vger.kernel.org # 4.4+ Suggested-by:
Filipe Manana <fdmanana@suse.com> Reviewed-by:
Marcos Paulo de Souza <mpdesouza@suse.com> Signed-off-by:
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Filipe Manana authored
When scrubbing a stripe, whenever we find an extent we lookup for its checksums in the checksum tree. However we do it even for metadata extents which don't have checksum items stored in the checksum tree, that is only for data extents. So make the lookup for checksums only if we are processing with a data extent. Signed-off-by:
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Filipe Manana authored
The helpers btrfs_freeze_block_group() and btrfs_unfreeze_block_group() used to be named btrfs_get_block_group_trimming() and btrfs_put_block_group_trimming() respectively. At the time they were added to free-space-cache.c, by commit e33e17ee ("btrfs: add missing discards when unpinning extents with -o discard") because all the trimming related functions were in free-space-cache.c. Now that the helpers were renamed and are used in scrub context as well, move them to block-group.c, a much more logical location for them. Signed-off-by:
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Filipe Manana authored
Back in 2014, commit 04216820 ("Btrfs: fix race between fs trimming and block group remove/allocation"), I added the 'trimming' member to the block group structure. Its purpose was to prevent races between trimming and block group deletion/allocation by pinning the block group in a way that prevents its logical address and device extents from being reused while trimming is in progress for a block group, so that if another task deletes the block group and then another task allocates a new block group that gets the same logical address and device extents while the trimming task is still in progress. After the previous fix for scrub (patch "btrfs: fix a race between scrub and block group removal/allocation"), scrub now also has the same needs that trimming has, so the member name 'trimming' no longer makes sense. Since there is already a 'pinned' member in the block group that refers to space reservations (pinned bytes), rename the member to 'frozen', add a comment on top of it to describe its general purpose and rename the helpers to increment and decrement the counter as well, to match the new member name. The next patch in the series will move the helpers into a more suitable file (from free-space-cache.c to block-group.c). Signed-off-by:
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Filipe Manana authored
When scrub is verifying the extents of a block group for a device, it is possible that the corresponding block group gets removed and its logical address and device extents get used for a new block group allocation. When this happens scrub incorrectly reports that errors were detected and, if the the new block group has a different profile then the old one, deleted block group, we can crash due to a null pointer dereference. Possibly other unexpected and weird consequences can happen as well. Consider the following sequence of actions that leads to the null pointer dereference crash when scrub is running in parallel with balance: 1) Balance sets block group X to read-only mode and starts relocating it. Block group X is a metadata block group, has a raid1 profile (two device extents, each one in a different device) and a logical address of 19424870400; 2) Scrub is running and finds device extent E, which belongs to block group X. It enters scrub_stripe() to find all extents allocated to block group X, the search is done using the extent tree; 3) Balance finishes relocating block group X and removes block group X; 4) Balance starts relocating another block group and when trying to commit the current transaction as part of the preparation step (prepare_to_relocate()), it blocks because scrub is running; 5) The scrub task finds the metadata extent at the logical address 19425001472 and marks the pages of the extent to be read by a bio (struct scrub_bio). The extent item's flags, which have the bit BTRFS_EXTENT_FLAG_TREE_BLOCK set, are added to each page (struct scrub_page). It is these flags in the scrub pages that tells the bio's end io function (scrub_bio_end_io_worker) which type of extent it is dealing with. At this point we end up with 4 pages in a bio which is ready for submission (the metadata extent has a size of 16Kb, so that gives 4 pages on x86); 6) At the next iteration of scrub_stripe(), scrub checks that there is a pause request from the relocation task trying to commit a transaction, therefore it submits the pending bio and pauses, waiting for the transaction commit to complete before resuming; 7) The relocation task commits the transaction. The device extent E, that was used by our block group X, is now available for allocation, since the commit root for the device tree was swapped by the transaction commit; 8) Another task doing a direct IO write allocates a new data block group Y which ends using device extent E. This new block group Y also ends up getting the same logical address that block group X had: 19424870400. This happens because block group X was the block group with the highest logical address and, when allocating Y, find_next_chunk() returns the end offset of the current last block group to be used as the logical address for the new block group, which is 18351128576 + 1073741824 = 19424870400 So our new block group Y has the same logical address and device extent that block group X had. However Y is a data block group, while X was a metadata one, and Y has a raid0 profile, while X had a raid1 profile; 9) After allocating block group Y, the direct IO submits a bio to write to device extent E; 10) The read bio submitted by scrub reads the 4 pages (16Kb) from device extent E, which now correspond to the data written by the task that did a direct IO write. Then at the end io function associated with the bio, scrub_bio_end_io_worker(), we call scrub_block_complete() which calls scrub_checksum(). This later function checks the flags of the first page, and sees that the bit BTRFS_EXTENT_FLAG_TREE_BLOCK is set in the flags, so it assumes it has a metadata extent and then calls scrub_checksum_tree_block(). That functions returns an error, since interpreting data as a metadata extent causes the checksum verification to fail. So this makes scrub_checksum() call scrub_handle_errored_block(), which determines 'failed_mirror_index' to be 1, since the device extent E was allocated as the second mirror of block group X. It allocates BTRFS_MAX_MIRRORS scrub_block structures as an array at 'sblocks_for_recheck', and all the memory is initialized to zeroes by kcalloc(). After that it calls scrub_setup_recheck_block(), which is responsible for filling each of those structures. However, when that function calls btrfs_map_sblock() against the logical address of the metadata extent, 19425001472, it gets a struct btrfs_bio ('bbio') that matches the current block group Y. However block group Y has a raid0 profile and not a raid1 profile like X had, so the following call returns 1: scrub_nr_raid_mirrors(bbio) And as a result scrub_setup_recheck_block() only initializes the first (index 0) scrub_block structure in 'sblocks_for_recheck'. Then scrub_recheck_block() is called by scrub_handle_errored_block() with the second (index 1) scrub_block structure as the argument, because 'failed_mirror_index' was previously set to 1. This scrub_block was not initialized by scrub_setup_recheck_block(), so it has zero pages, its 'page_count' member is 0 and its 'pagev' page array has all members pointing to NULL. Finally when scrub_recheck_block() calls scrub_recheck_block_checksum() we have a NULL pointer dereference when accessing the flags of the first page, as pavev[0] is NULL: static void scrub_recheck_block_checksum(struct scrub_block *sblock) { (...) if (sblock->pagev[0]->flags & BTRFS_EXTENT_FLAG_DATA) scrub_checksum_data(sblock); (...) } Producing a stack trace like the following: [542998.008985] BUG: kernel NULL pointer dereference, address: 0000000000000028 [542998.010238] #PF: supervisor read access in kernel mode [542998.010878] #PF: error_code(0x0000) - not-present page [542998.011516] PGD 0 P4D 0 [542998.011929] Oops: 0000 [#1] PREEMPT SMP DEBUG_PAGEALLOC PTI [542998.012786] CPU: 3 PID: 4846 Comm: kworker/u8:1 Tainted: G B W 5.6.0-rc7-btrfs-next-58 #1 [542998.014524] Hardware name: QEMU Standard PC (i440FX + PIIX, 1996), BIOS rel-1.12.0-59-gc9ba5276e321-prebuilt.qemu.org 04/01/2014 [542998.016065] Workqueue: btrfs-scrub btrfs_work_helper [btrfs] [542998.017255] RIP: 0010:scrub_recheck_block_checksum+0xf/0x20 [btrfs] [542998.018474] Code: 4c 89 e6 ... [542998.021419] RSP: 0018:ffffa7af0375fbd8 EFLAGS: 00010202 [542998.022120] RAX: 0000000000000000 RBX: ffff9792e674d120 RCX: 0000000000000000 [542998.023178] RDX: 0000000000000001 RSI: ffff9792e674d120 RDI: ffff9792e674d120 [542998.024465] RBP: 0000000000000000 R08: 0000000000000067 R09: 0000000000000001 [542998.025462] R10: ffffa7af0375fa50 R11: 0000000000000000 R12: ffff9791f61fe800 [542998.026357] R13: ffff9792e674d120 R14: 0000000000000001 R15: ffffffffc0e3dfc0 [542998.027237] FS: 0000000000000000(0000) GS:ffff9792fb200000(0000) knlGS:0000000000000000 [542998.028327] CS: 0010 DS: 0000 ES: 0000 CR0: 0000000080050033 [542998.029261] CR2: 0000000000000028 CR3: 00000000b3b18003 CR4: 00000000003606e0 [542998.030301] DR0: 0000000000000000 DR1: 0000000000000000 DR2: 0000000000000000 [542998.031316] DR3: 0000000000000000 DR6: 00000000fffe0ff0 DR7: 0000000000000400 [542998.032380] Call Trace: [542998.032752] scrub_recheck_block+0x162/0x400 [btrfs] [542998.033500] ? __alloc_pages_nodemask+0x31e/0x460 [542998.034228] scrub_handle_errored_block+0x6f8/0x1920 [btrfs] [542998.035170] scrub_bio_end_io_worker+0x100/0x520 [btrfs] [542998.035991] btrfs_work_helper+0xaa/0x720 [btrfs] [542998.036735] process_one_work+0x26d/0x6a0 [542998.037275] worker_thread+0x4f/0x3e0 [542998.037740] ? process_one_work+0x6a0/0x6a0 [542998.038378] kthread+0x103/0x140 [542998.038789] ? kthread_create_worker_on_cpu+0x70/0x70 [542998.039419] ret_from_fork+0x3a/0x50 [542998.039875] Modules linked in: dm_snapshot dm_thin_pool ... [542998.047288] CR2: 0000000000000028 [542998.047724] ---[ end trace bde186e176c7f96a ]--- This issue has been around for a long time, possibly since scrub exists. The last time I ran into it was over 2 years ago. After recently fixing fstests to pass the "--full-balance" command line option to btrfs-progs when doing balance, several tests started to more heavily exercise balance with fsstress, scrub and other operations in parallel, and therefore started to hit this issue again (with btrfs/061 for example). Fix this by having scrub increment the 'trimming' counter of the block group, which pins the block group in such a way that it guarantees neither its logical address nor device extents can be reused by future block group allocations until we decrement the 'trimming' counter. Also make sure that on each iteration of scrub_stripe() we stop scrubbing the block group if it was removed already. A later patch in the series will rename the block group's 'trimming' counter and its helpers to a more generic name, since now it is not used exclusively for pinning while trimming anymore. CC: stable@vger.kernel.org # 4.4+ Signed-off-by: -
David Sterba authored
The extent references v0 have been superseded long time go, there are some unused declarations of access helpers. We can safely remove them now. The struct btrfs_extent_ref_v0 is not used anywhere, but struct btrfs_extent_item_v0 is still part of a backward compatibility check in relocation.c and thus not removed. Signed-off-by: -
YueHaibing authored
There's no callers in-tree anymore since commit d24ee97b ("btrfs: use new helpers to set uuids in eb") Signed-off-by:
YueHaibing <yuehaibing@huawei.com> Reviewed-by:
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Qu Wenruo authored
[BUG] For the following operation, qgroup is guaranteed to be screwed up due to snapshot adding to a new qgroup: # mkfs.btrfs -f $dev # mount $dev $mnt # btrfs qgroup en $mnt # btrfs subv create $mnt/src # xfs_io -f -c "pwrite 0 1m" $mnt/src/file # sync # btrfs qgroup create 1/0 $mnt/src # btrfs subv snapshot -i 1/0 $mnt/src $mnt/snapshot # btrfs qgroup show -prce $mnt/src qgroupid rfer excl max_rfer max_excl parent child -------- ---- ---- -------- -------- ------ ----- 0/5 16.00KiB 16.00KiB none none --- --- 0/257 1.02MiB 16.00KiB none none --- --- 0/258 1.02MiB 16.00KiB none none 1/0 --- 1/0 0.00B 0.00B none none --- 0/258 ^^^^^^^^^^^^^^^^^^^^ [CAUSE] The problem is in btrfs_qgroup_inherit(), we don't have good enough check to determine if the new relation would break the existing accounting. Unlike btrfs_add_qgroup_relation(), which has proper check to determine if we can do quick update without a rescan, in btrfs_qgroup_inherit() we can even assign a snapshot to multiple qgroups. [FIX] Fix it by manually marking qgroup inconsistent for snapshot inheritance. For subvolume creation, since all its extents are exclusively owned, we don't need to rescan. In theory, we should call relation check like quick_update_accounting() when doing qgroup inheritance and inform user about qgroup accounting inconsistency. But we don't have good mechanism to relay that back to the user in the snapshot creation context, thus we can only silently mark the qgroup inconsistent. Anyway, user shouldn't use qgroup inheritance during snapshot creation, and should add qgroup relationship after snapshot creation by 'btrfs qgroup assign', which has a much better UI to inform user about qgroup inconsistent and kick in rescan automatically. Reviewed-by:
Josef Bacik <josef@toxicpanda.com> Signed-off-by:
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Robbie Ko authored
When mounting, we handle deleted subvolume and orphan items. First, find add orphan roots, then add them to fs_root radix tree. Second, in tree-root, process each orphan item, skip if it is dead root. The original algorithm is based on the list of dead_roots, one by one to visit and check whether the objectid is consistent, the time complexity is O (n ^ 2). When processing 50000 deleted subvols, it takes about 120s. Because btrfs_find_orphan_roots has already ran before us, and added deleted subvol to fs_roots radix tree. The fs root will only be removed from the fs_roots radix tree after the cleaner process is started, and the cleaner will only start execution after the mount is complete. btrfs_orphan_cleanup can be called during the whole filesystem mount lifetime, but only "tree root" will be used in this section of code, and only mount time will be brought into tree root. So we can quickly check whether the orphan item is dead root through the fs_roots radix tree. Reviewed-by:
Robbie Ko <robbieko@synology.com> Signed-off-by:
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YueHaibing authored
There's no callers in-tree anymore since commit 64403612 ("btrfs: rework btrfs_check_space_for_delayed_refs") Signed-off-by:
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David Sterba authored
I've grepped logs for 'errno=.*unknown' and found -95, -117 and -122, now added to the table. The wording is adjusted so it makes sense in context of filesystem. Reviewed-by:
Anand Jain <anand.jain@oracle.com> Signed-off-by:
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David Sterba authored
Add the raw errnos and sort them accordingly. Reviewed-by:
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Anand Jain authored
When an old device has new fsid through 'btrfs device add -f <dev>' our fs_devices list has an alien device in one of the fs_devices lists. By having an alien device in fs_devices, we have two issues so far 1. missing device does not not show as missing in the userland 2. degraded mount will fail Both issues are caused by the fact that there's an alien device in the fs_devices list. (Alien means that it does not belong to the filesystem, identified by fsid, or does not contain btrfs filesystem at all, eg. due to overwrite). A device can be scanned/added through the control device ioctls SCAN_DEV, DEVICES_READY or by ADD_DEV. And device coming through the control device is checked against the all other devices in the lists, but this was not the case for ADD_DEV. This patch fixes both issues above by removing the alien device. CC: stable@vger.kernel.org # 5.4+ Signed-off-by:
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Anand Jain authored
btrfs_free_extra_devids() updates fs_devices::latest_bdev to point to the bdev with greatest device::generation number. For a typical-missing device the generation number is zero so fs_devices::latest_bdev will never point to it. But if the missing device is due to alienation [1], then device::generation is not zero and if it is greater or equal to the rest of device generations in the list, then fs_devices::latest_bdev ends up pointing to the missing device and reports the error like [2]. [1] We maintain devices of a fsid (as in fs_device::fsid) in the fs_devices::devices list, a device is considered as an alien device if its fsid does not match with the fs_device::fsid Consider a working filesystem with raid1: $ mkfs.btrfs -f -d raid1 -m raid1 /dev/sda /dev/sdb $ mount /dev/sda /mnt-raid1 $ umount /mnt-raid1 While mnt-raid1 was unmounted the user force-adds one of its devices to another btrfs filesystem: $ mkfs.btrfs -f /dev/sdc $ mount /dev/sdc /mnt-single $ btrfs dev add -f /dev/sda /mnt-single Now the original mnt-raid1 fails to mount in degraded mode, because fs_devices::latest_bdev is pointing to the alien device. $ mount -o degraded /dev/sdb /mnt-raid1 [2] mount: wrong fs type, bad option, bad superblock on /dev/sdb, missing codepage or helper program, or other error In some cases useful info is found in syslog - try dmesg | tail or so. kernel: BTRFS warning (device sdb): devid 1 uuid 072a0192-675b-4d5a-8640-a5cf2b2c704d is missing kernel: BTRFS error (device sdb): failed to read devices kernel: BTRFS error (device sdb): open_ctree failed Fix the root cause by checking if the device is not missing before it can be considered for the fs_devices::latest_bdev. CC: stable@vger.kernel.org # 4.19+ Reviewed-by: -
Eric Biggers authored
Use crypto_shash_digest() instead of crypto_shash_init() + crypto_shash_update() + crypto_shash_final(). This is more efficient. Signed-off-by:
Eric Biggers <ebiggers@google.com> Reviewed-by:
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Anand Jain authored
There is no need of goto out in open_fs_devices() as there is nothing special done there. Reviewed-by:
Nikolay Borisov <nborisov@suse.com> Reviewed-by:
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Filipe Manana authored
At btrfs_log_prealloc_extents() we are checking if copy_items() returns a value greater than 0. That used to happen in the past to signal the caller that the path given to it was released and reused for other searches, but as of commit 0e56315c ("Btrfs: fix missing hole after hole punching and fsync when using NO_HOLES"), the copy_items() function does not have that behaviour anymore and always returns 0 or a negative value. So just remove that check at btrfs_log_prealloc_extents(), which the previously mentioned commit forgot to remove. Signed-off-by:
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Omar Sandoval authored
Currently, direct I/O has its own versions of bio_readpage_error() and btrfs_check_repairable() (dio_read_error() and btrfs_check_dio_repairable(), respectively). The main difference is that the direct I/O version doesn't do read validation. The rework of direct I/O repair makes it possible to do validation, so we can get rid of btrfs_check_dio_repairable() and combine bio_readpage_error() and dio_read_error() into a new helper, btrfs_submit_read_repair(). Reviewed-by:
Omar Sandoval <osandov@fb.com> Signed-off-by:
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