- 06 Dec, 2016 2 commits
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Zhengyuan Liu authored
We should update log state after we did a log recovery, current completion may get wrong log state since log->log_start wasn't initalized until we called r5l_recovery_log. At log recovery stage, no lock needed as there is no race conditon. next_checkpoint field will be initialized in r5l_recovery_log too. Signed-off-by:
Zhengyuan Liu <liuzhengyuan@kylinos.cn> Signed-off-by:
Shaohua Li <shli@fb.com>
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JackieLiu authored
When recovery is complete, we write an empty block and record his position first, then make the data-only stripes rewritten done, the location of the empty block as the last checkpoint position to write into the super block. And we should update last_checkpoint to this empty block position. ------------------------------------------------------------------ | old log | empty block | data only stripes | invalid log | ------------------------------------------------------------------ ^ ^ ^ | |- log->last_checkpoint |- log->log_start | |- log->last_cp_seq |- log->next_checkpoint |- log->seq=n |- log->seq=10+n At the same time, if there is no data-only stripes, this scene may appear, | meta1 | meta2 | meta3 | meta 1 is valid, meta 2 is invalid. meta 3 could be valid. so we should The solution is we create a new meta in meta2 with its seq == meta1's seq + 10 and let superblock points to meta2. Signed-off-by:
JackieLiu <liuyun01@kylinos.cn> Reviewed-by:
Song Liu <songliubraving@fb.com> Signed-off-by:
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- 02 Dec, 2016 1 commit
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Song Liu authored
With writeback cache, we define log space critical as free_space < 2 * reclaim_required_space So the deassert of R5C_LOG_CRITICAL could happen when 1. free_space increases 2. reclaim_required_space decreases Currently, run_no_space_stripes() is called when 1 happens, but not (always) when 2 happens. With this patch, run_no_space_stripes() is call when R5C_LOG_CRITICAL is cleared. Signed-off-by:
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- 29 Nov, 2016 8 commits
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Konstantin Khlebnikov authored
Current implementation employ 16bit counter of active stripes in lower bits of bio->bi_phys_segments. If request is big enough to overflow this counter bio will be completed and freed too early. Fortunately this not happens in default configuration because several other limits prevent that: stripe_cache_size * nr_disks effectively limits count of active stripes. And small max_sectors_kb at lower disks prevent that during normal read/write operations. Overflow easily happens in discard if it's enabled by module parameter "devices_handle_discard_safely" and stripe_cache_size is set big enough. This patch limits requests size with 256Mb - 8Kb to prevent overflows. Signed-off-by:
Konstantin Khlebnikov <khlebnikov@yandex-team.ru> Cc: Shaohua Li <shli@kernel.org> Cc: Neil Brown <neilb@suse.com> Cc: stable@vger.kernel.org Signed-off-by:
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JackieLiu authored
R5c_make_stripe_write_out has set this flag, do not need to set again. Signed-off-by:
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JackieLiu authored
The next_cp_seq field is useless, remove it. Signed-off-by:
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JackieLiu authored
If we released the 'stripe_head' in r5c_recovery_flush_log, ctx->cached_list will both release the data-parity stripes and data-only stripes, which will become empty. And we also need to use the data-only stripes in r5c_recovery_rewrite_data_only_stripes, so we should wait util rewrite data-only stripes is done before releasing them. Reviewed-by:
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JackieLiu authored
'write_pos' must be protected with 'r5l_ring_add', or it may overflow Signed-off-by:
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JackieLiu authored
The function parameter 'recovery_list' is not used in body, we can delete it Signed-off-by:
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Zhengyuan Liu authored
r5c_recovery_load_one_stripe should not set STRIPE_R5C_PARTIAL_STRIPE flag,as the data-only stripe may be STRIPE_R5C_FULL_STRIPE stripe. The state machine would release the stripe later and add it into neither r5c_cached_full_stripes list or r5c_cached_partial_stripes list and set correct flag. Reviewed-by:
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Zhengyuan Liu authored
New stripe that was just allocated has no STRIPE_R5C_CACHING state too, add this check condition could avoid unnecessary replaying for empty stripe. r5l_recovery_replay_one_stripe would reset stripe for any case, delete it to make code more clean. Signed-off-by:
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- 28 Nov, 2016 2 commits
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Dan Carpenter authored
We need to re-enable the IRQs here before returning. Fixes: a39f7afd ("md/r5cache: write-out phase and reclaim support") Signed-off-by:
Dan Carpenter <dan.carpenter@oracle.com> Signed-off-by:
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Song Liu authored
RMW of r5c write back cache uses an extra page to store old data for prexor. handle_stripe_dirtying() allocates this page by calling alloc_page(). However, alloc_page() may fail. To handle alloc_page() failures, this patch adds an extra page to disk_info. When alloc_page fails, handle_stripe() trys to use these pages. When these pages are used by other stripe (R5C_EXTRA_PAGE_IN_USE), the stripe is added to delayed_list. Signed-off-by:
NeilBrown <neilb@suse.com> Signed-off-by:
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- 24 Nov, 2016 2 commits
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Shaohua Li authored
__md_stop_writes currently doesn't stop raid5-cache reclaim thread. It's possible the reclaim thread is still running and doing write, which doesn't match what __md_stop_writes should do. The extra ->quiesce() call should not harm any raid types. For raid5-cache, this will guarantee we reclaim all caches before we update superblock. Signed-off-by:
NeilBrown <neilb@suse.de> Cc: Song Liu <songliubraving@fb.com>
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Shaohua Li authored
There is mechanism to suspend a kernel thread. Use it instead of playing create/destroy game. Signed-off-by:
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- 22 Nov, 2016 6 commits
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NeilBrown authored
When writing to a fastfail device, we use MD_FASTFAIL unless it is the only device being written to. For resync/recovery, assume there was a working device to read from so always use MD_FASTFAIL. If a write for resync/recovery fails, we just fail the device - there is not much else to do. If a normal write fails, but the device cannot be marked Faulty (must be only one left), we queue for write error handling which calls narrow_write_error() to write the block synchronously without any failfast flags. Signed-off-by:
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NeilBrown authored
If a device is marked FailFast, and it is not the only device we can read from, we mark the bio as MD_FAILFAST. If this does fail-fast, we don't try read repair but just allow failure. If it was the last device, it doesn't get marked Faulty so the retry happens on the same device - this time without FAILFAST. A subsequent failure will not retry but will just pass up the error. During resync we may use FAILFAST requests, and on a failure we will simply use the other device(s). During recovery we will only use FAILFAST in the unusual case were there are multiple places to read from - i.e. if there are > 2 devices. If we get a failure we will fail the device and complete the resync/recovery with remaining devices. Signed-off-by:
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NeilBrown authored
When writing to a fastfail device we use MD_FASTFAIL unless it is the only device being written to. For resync/recovery, assume there was a working device to read from so always use REQ_FASTFAIL_DEV. If a write for resync/recovery fails, we just fail the device - there is not much else to do. If a normal failfast write fails, but the device cannot be failed (must be only one left), we queue for write error handling. This will call narrow_write_error() to retry the write synchronously and without any FAILFAST flags. Signed-off-by:
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NeilBrown authored
If a device is marked FailFast and it is not the only device we can read from, we mark the bio with REQ_FAILFAST_* flags. If this does fail, we don't try read repair but just allow failure. If it was the last device it doesn't fail of course, so the retry happens on the same device - this time without FAILFAST. A subsequent failure will not retry but will just pass up the error. During resync we may use FAILFAST requests and on a failure we will simply use the other device(s). During recovery we will only use FAILFAST in the unusual case were there are multiple places to read from - i.e. if there are > 2 devices. If we get a failure we will fail the device and complete the resync/recovery with remaining devices. The new R1BIO_FailFast flag is set on read reqest to suggest the a FAILFAST request might be acceptable. The rdev needs to have FailFast set as well for the read to actually use REQ_FAILFAST_*. We need to know there are at least two working devices before we can set R1BIO_FailFast, so we mustn't stop looking at the first device we find. So the "min_pending == 0" handling to not exit early, but too always choose the best_pending_disk if min_pending == 0. The spinlocked region in raid1_error() in enlarged to ensure that if two bios, reading from two different devices, fail at the same time, then there is no risk that both devices will be marked faulty, leaving zero "In_sync" devices. Signed-off-by:
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NeilBrown authored
This can only be supported on personalities which ensure that md_error() never causes an array to enter the 'failed' state. i.e. if marking a device Faulty would cause some data to be inaccessible, the device is status is left as non-Faulty. This is true for RAID1 and RAID10. If we get a failure writing metadata but the device doesn't fail, it must be the last device so we re-write without FAILFAST to improve chance of success. We also flag the device as LastDev so that future metadata updates don't waste time on failfast writes. Signed-off-by:
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NeilBrown authored
This patch just adds a 'failfast' per-device flag which can be stored in v0.90 or v1.x metadata. The flag is not used yet but the intent is that it can be used for mirrored (raid1/raid10) arrays where low latency is more important than keeping all devices on-line. Setting the flag for a device effectively gives permission for that device to be marked as Faulty and excluded from the array on the first error. The underlying driver will be directed not to retry requests that result in failures. There is a proviso that the device must not be marked faulty if that would cause the array as a whole to fail, it may only be marked Faulty if the array remains functional, but is degraded. Failures on read requests will cause the device to be marked as Faulty immediately so that further reads will avoid that device. No attempt will be made to correct read errors by over-writing with the correct data. It is expected that if transient errors, such as cable unplug, are possible, then something in user-space will revalidate failed devices and re-add them when they appear to be working again. Signed-off-by:
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- 19 Nov, 2016 1 commit
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Song Liu authored
With raid5 cache, we committing data from journal device. When there is flush request, we need to flush journal device's cache. This was not needed in raid5 journal, because we will flush the journal before committing data to raid disks. This is similar to FUA, except that we also need flush journal for FUA. Otherwise, corruptions in earlier meta data will stop recovery from reaching FUA data. slightly changed the code by Shaohua Signed-off-by:
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- 18 Nov, 2016 13 commits
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Song Liu authored
1. In previous patch, we: - add new data to r5l_recovery_ctx - add new functions to recovery write-back cache The new functions are not used in this patch, so this patch does not change the behavior of recovery. 2. In this patchpatch, we: - modify main recovery procedure r5l_recovery_log() to call new functions - remove old functions Signed-off-by: -
Song Liu authored
Recovery of write-back cache has different logic to write-through only cache. Specifically, for write-back cache, the recovery need to scan through all active journal entries before flushing data out. Therefore, large portion of the recovery logic is rewritten here. To make the diffs cleaner, we split the rewrite as follows: 1. In this patch, we: - add new data to r5l_recovery_ctx - add new functions to recovery write-back cache The new functions are not used in this patch, so this patch does not change the behavior of recovery. 2. In next patch, we: - modify main recovery procedure r5l_recovery_log() to call new functions - remove old functions With cache feature, there are 2 different scenarios of recovery: 1. Data-Parity stripe: a stripe with complete parity in journal. 2. Data-Only stripe: a stripe with only data in journal (or partial parity). The code differentiate Data-Parity stripe from Data-Only stripe with flag STRIPE_R5C_CACHING. For Data-Parity stripes, we use the same procedure as raid5 journal, where all the data and parity are replayed to the RAID devices. For Data-Only strips, we need to finish complete calculate parity and finish the full reconstruct write or RMW write. For simplicity, in the recovery, we load the stripe to stripe cache. Once the array is started, the stripe cache state machine will handle these stripes through normal write path. r5c_recovery_flush_log contains the main procedure of recovery. The recovery code first scans through the journal and loads data to stripe cache. The code keeps tracks of all these stripes in a list (use sh->lru and ctx->cached_list), stripes in the list are organized in the order of its first appearance on the journal. During the scan, the recovery code assesses each stripe as Data-Parity or Data-Only. During scan, the array may run out of stripe cache. In these cases, the recovery code will also call raid5_set_cache_size to increase stripe cache size. If the array still runs out of stripe cache because there isn't enough memory, the array will not assemble. At the end of scan, the recovery code replays all Data-Parity stripes, and sets proper states for Data-Only stripes. The recovery code also increases seq number by 10 and rewrites all Data-Only stripes to journal. This is to avoid confusion after repeated crashes. More details is explained in raid5-cache.c before r5c_recovery_rewrite_data_only_stripes(). Signed-off-by: -
Song Liu authored
1. rename r5l_read_meta_block() as r5l_recovery_read_meta_block(); 2. pull the code that initialize r5l_meta_block from r5l_log_write_empty_meta_block() to a separate function r5l_recovery_create_empty_meta_block(), so that we can reuse this piece of code. Signed-off-by:
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Song Liu authored
With write cache, journal_mode is the knob to switch between write-back and write-through. Below is an example: root@virt-test:~/# cat /sys/block/md0/md/journal_mode [write-through] write-back root@virt-test:~/# echo write-back > /sys/block/md0/md/journal_mode root@virt-test:~/# cat /sys/block/md0/md/journal_mode write-through [write-back] Signed-off-by:
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Song Liu authored
There are two limited resources, stripe cache and journal disk space. For better performance, we priotize reclaim of full stripe writes. To free up more journal space, we free earliest data on the journal. In current implementation, reclaim happens when: 1. Periodically (every R5C_RECLAIM_WAKEUP_INTERVAL, 30 seconds) reclaim if there is no reclaim in the past 5 seconds. 2. when there are R5C_FULL_STRIPE_FLUSH_BATCH (256) cached full stripes, or cached stripes is enough for a full stripe (chunk size / 4k) (r5c_check_cached_full_stripe) 3. when there is pressure on stripe cache (r5c_check_stripe_cache_usage) 4. when there is pressure on journal space (r5l_write_stripe, r5c_cache_data) r5c_do_reclaim() contains new logic of reclaim. For stripe cache: When stripe cache pressure is high (more than 3/4 stripes are cached, or there is empty inactive lists), flush all full stripe. If fewer than R5C_RECLAIM_STRIPE_GROUP (NR_STRIPE_HASH_LOCKS * 2) full stripes are flushed, flush some paritial stripes. When stripe cache pressure is moderate (1/2 to 3/4 of stripes are cached), flush all full stripes. For log space: To avoid deadlock due to log space, we need to reserve enough space to flush cached data. The size of required log space depends on total number of cached stripes (stripe_in_journal_count). In current implementation, the writing-out phase automatically include pending data writes with parity writes (similar to write through case). Therefore, we need up to (conf->raid_disks + 1) pages for each cached stripe (1 page for meta data, raid_disks pages for all data and parity). r5c_log_required_to_flush_cache() calculates log space required to flush cache. In the following, we refer to the space calculated by r5c_log_required_to_flush_cache() as reclaim_required_space. Two flags are added to r5conf->cache_state: R5C_LOG_TIGHT and R5C_LOG_CRITICAL. R5C_LOG_TIGHT is set when free space on the log device is less than 3x of reclaim_required_space. R5C_LOG_CRITICAL is set when free space on the log device is less than 2x of reclaim_required_space. r5c_cache keeps all data in cache (not fully committed to RAID) in a list (stripe_in_journal_list). These stripes are in the order of their first appearance on the journal. So the log tail (last_checkpoint) should point to the journal_start of the first item in the list. When R5C_LOG_TIGHT is set, r5l_reclaim_thread starts flushing out stripes at the head of stripe_in_journal. When R5C_LOG_CRITICAL is set, the state machine only writes data that are already in the log device (in stripe_in_journal_list). This patch includes a fix to improve performance by Shaohua Li <shli@fb.com>. Signed-off-by:
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Song Liu authored
As described in previous patch, write back cache operates in two phases: caching and writing-out. The caching phase works as: 1. write data to journal (r5c_handle_stripe_dirtying, r5c_cache_data) 2. call bio_endio (r5c_handle_data_cached, r5c_return_dev_pending_writes). Then the writing-out phase is as: 1. Mark the stripe as write-out (r5c_make_stripe_write_out) 2. Calcualte parity (reconstruct or RMW) 3. Write parity (and maybe some other data) to journal device 4. Write data and parity to RAID disks This patch implements caching phase. The cache is integrated with stripe cache of raid456. It leverages code of r5l_log to write data to journal device. Writing-out phase of the cache is implemented in the next patch. With r5cache, write operation does not wait for parity calculation and write out, so the write latency is lower (1 write to journal device vs. read and then write to raid disks). Also, r5cache will reduce RAID overhead (multipile IO due to read-modify-write of parity) and provide more opportunities of full stripe writes. This patch adds 2 flags to stripe_head.state: - STRIPE_R5C_PARTIAL_STRIPE, - STRIPE_R5C_FULL_STRIPE, Instead of inactive_list, stripes with cached data are tracked in r5conf->r5c_full_stripe_list and r5conf->r5c_partial_stripe_list. STRIPE_R5C_FULL_STRIPE and STRIPE_R5C_PARTIAL_STRIPE are flags for stripes in these lists. Note: stripes in r5c_full/partial_stripe_list are not considered as "active". For RMW, the code allocates an extra page for each data block being updated. This is stored in r5dev->orig_page and the old data is read into it. Then the prexor calculation subtracts ->orig_page from the parity block, and the reconstruct calculation adds the ->page data back into the parity block. r5cache naturally excludes SkipCopy. When the array has write back cache, async_copy_data() will not skip copy. There are some known limitations of the cache implementation: 1. Write cache only covers full page writes (R5_OVERWRITE). Writes of smaller granularity are write through. 2. Only one log io (sh->log_io) for each stripe at anytime. Later writes for the same stripe have to wait. This can be improved by moving log_io to r5dev. 3. With writeback cache, read path must enter state machine, which is a significant bottleneck for some workloads. 4. There is no per stripe checkpoint (with r5l_payload_flush) in the log, so recovery code has to replay more than necessary data (sometimes all the log from last_checkpoint). This reduces availability of the array. This patch includes a fix proposed by ZhengYuan Liu <liuzhengyuan@kylinos.cn> Signed-off-by:
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Song Liu authored
This patch adds state machine for raid5-cache. With log device, the raid456 array could operate in two different modes (r5c_journal_mode): - write-back (R5C_MODE_WRITE_BACK) - write-through (R5C_MODE_WRITE_THROUGH) Existing code of raid5-cache only has write-through mode. For write-back cache, it is necessary to extend the state machine. With write-back cache, every stripe could operate in two different phases: - caching - writing-out In caching phase, the stripe handles writes as: - write to journal - return IO In writing-out phase, the stripe behaviors as a stripe in write through mode R5C_MODE_WRITE_THROUGH. STRIPE_R5C_CACHING is added to sh->state to differentiate caching and writing-out phase. Please note: this is a "no-op" patch for raid5-cache write-through mode. The following detailed explanation is copied from the raid5-cache.c: /* * raid5 cache state machine * * With rhe RAID cache, each stripe works in two phases: * - caching phase * - writing-out phase * * These two phases are controlled by bit STRIPE_R5C_CACHING: * if STRIPE_R5C_CACHING == 0, the stripe is in writing-out phase * if STRIPE_R5C_CACHING == 1, the stripe is in caching phase * * When there is no journal, or the journal is in write-through mode, * the stripe is always in writing-out phase. * * For write-back journal, the stripe is sent to caching phase on write * (r5c_handle_stripe_dirtying). r5c_make_stripe_write_out() kicks off * the write-out phase by clearing STRIPE_R5C_CACHING. * * Stripes in caching phase do not write the raid disks. Instead, all * writes are committed from the log device. Therefore, a stripe in * caching phase handles writes as: * - write to log device * - return IO * * Stripes in writing-out phase handle writes as: * - calculate parity * - write pending data and parity to journal * - write data and parity to raid disks * - return IO for pending writes */ Signed-off-by:
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Song Liu authored
Move some define and inline functions to raid5.h, so they can be used in raid5-cache.c Signed-off-by:
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Song Liu authored
Currently, r5l_write_stripe checks meta size for each stripe write, which is not necessary. With this patch, r5l_init_log checks maximal meta size of the array, which is (r5l_meta_block + raid_disks x r5l_payload_data_parity). If this is too big to fit in one page, r5l_init_log aborts. With current meta data, r5l_log support raid_disks up to 203. Signed-off-by:
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Shaohua Li authored
superblock write is an expensive operation. With raid5-cache, it can be called regularly. Tracing to help performance debug. Signed-off-by: -
NeilBrown authored
Both raid1 and raid10 will sometimes delay handling an IO request, such as when resync is happening or there are too many requests queued. Add some blktrace messsages so we can see when that is happening when looking for performance artefacts. Signed-off-by:
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NeilBrown authored
We trace wheneven bitmap_unplug() finds that it needs to write to the bitmap, or when bitmap_daemon_work() find there is work to do. This makes it easier to correlate bitmap updates with data writes. Signed-off-by:
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NeilBrown authored
The block tracing infrastructure (accessed with blktrace/blkparse) supports the tracing of mapping bios from one device to another. This is currently used when a bio in a partition is mapped to the whole device, when bios are mapped by dm, and for mapping in md/raid5. Other md personalities do not include this tracing yet, so add it. When a read-error is detected we redirect the request to a different device. This could justifiably be seen as a new mapping for the originial bio, or a secondary mapping for the bio that errors. This patch uses the second option. When md is used under dm-raid, the mappings are not traced as we do not have access to the block device number of the parent. Signed-off-by:
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- 17 Nov, 2016 1 commit
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Shaohua Li authored
lockdep reports warning of the rcu_dereference usage. Using normal rdev access pattern to avoid the warning. Signed-off-by:
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- 10 Nov, 2016 1 commit
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NeilBrown authored
bitmap_flush() finishes with bitmap_update_sb(), and that finishes with write_page(..., 1), so write_page() will wait for all writes to complete. So there is no point calling md_super_wait() immediately afterwards. Signed-off-by:
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- 09 Nov, 2016 2 commits
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NeilBrown authored
This is less error prone than using individual #defines. Signed-off-by:
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NeilBrown authored
While performing a resync/recovery, raid1 divides the array space into three regions: - before the resync - at or shortly after the resync point - much further ahead of the resync point. Write requests to the first or third do not need to wait. Write requests to the middle region do need to wait if resync requests are pending. If there are any active write requests in the middle region, resync will wait for them. Due to an accounting error, there is a small range of addresses, between conf->next_resync and conf->start_next_window, where write requests will *not* be blocked, but *will* be counted in the middle region. This can effectively block resync indefinitely if filesystem writes happen repeatedly to this region. As ->next_window_requests is incremented when the sector is after conf->start_next_window + NEXT_NORMALIO_DISTANCE the same boundary should be used for determining when write requests should wait. Signed-off-by:
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- 07 Nov, 2016 1 commit
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NeilBrown authored
As we don't wait for writes to complete in bitmap_daemon_work, they could still be in-flight when bitmap_unplug writes again. Or when bitmap_daemon_work tries to write again. This can be confusing and could risk the wrong data being written last. So make sure we wait for old writes to complete before new writes start. Signed-off-by:
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