- 06 Jan, 2018 11 commits
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Ming Lei authored
The bio is always freed after running crypt_free_buffer_pages(), so it isn't necessary to clear bv->bv_page. Cc: Mike Snitzer <snitzer@redhat.com> Cc:dm-devel@redhat.com Signed-off-by:
Ming Lei <ming.lei@redhat.com> Signed-off-by:
Jens Axboe <axboe@kernel.dk>
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Ming Lei authored
Commit 17347cec(Btrfs: change how we iterate bios in endio) mentioned that for dio the submitted bio may be fast cloned, we can't access the bvec table directly for a cloned bio, so use bio_get_first_bvec() to retrieve the 1st bvec. Cc: Chris Mason <clm@fb.com> Cc: Josef Bacik <jbacik@fb.com> Cc: David Sterba <dsterba@suse.com> Cc: linux-btrfs@vger.kernel.org Cc: Liu Bo <bo.li.liu@oracle.com> Reviewed-by:
Liu Bo <bo.li.liu@oracle.com> Acked: David Sterba <dsterba@suse.com> Signed-off-by:
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Ming Lei authored
BTRFS uses bio->bi_vcnt to figure out page numbers, this approach is no longer valid once we start enabling multipage bvecs. correct once we start to enable multipage bvec. Use bio_nr_pages() to do that instead. Cc: Chris Mason <clm@fb.com> Cc: Josef Bacik <jbacik@fb.com> Cc: David Sterba <dsterba@suse.com> Cc: linux-btrfs@vger.kernel.org Acked-by:
David Sterba <dsterba@suse.com> Signed-off-by:
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Ming Lei authored
bcache is the only user of bio_alloc_pages(), so move this function into bcache, and avoid it being misused in the future. Also rename it to bch_bio_allo_pages() since it is bcache only. Signed-off-by:
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Ming Lei authored
All direct access to bvec table are safe even after multipage bvec is supported. Cc: linux-bcache@vger.kernel.org Acked-by:
Coly Li <colyli@suse.de> Signed-off-by:
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Ming Lei authored
For BIO based DM, some targets aren't ready for dealing with bigger incoming bio than 1Mbyte, such as crypt target. Cc: Mike Snitzer <snitzer@redhat.com> Cc:dm-devel@redhat.com Reviewed-by:
Christoph Hellwig <hch@lst.de> Signed-off-by:
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Ming Lei authored
Firstly this patch introduces BVEC_ITER_ALL_INIT for iterating one bio from start to end. As we need to support multipage bvecs, don't access bio->bi_io_vec in copy_to_high_bio_irq(), and just use the standard iterator for that. Signed-off-by:
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Ming Lei authored
We will support multipage bvecs in the future, so change to iterator way for getting bv_page of bvec from original bio. Cc: Matthew Wilcox <willy@infradead.org> Signed-off-by:
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Ming Lei authored
This patch converts 3 users to bio_last_bvec_all(), so that we can go ahead and convert to multipage bvec. Signed-off-by:
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Ming Lei authored
This patch converts to bio_first_bvec_all() & bio_first_page_all() for retrieving the 1st bvec/page, and prepares for supporting multipage bvec. Signed-off-by:
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Ming Lei authored
The following helpers are introduced for converting current users of direct access to bvec table, and prepares for supporting multipage bvec: bio_pages_all() bio_first_bvec_all() bio_first_page_all() bio_last_bvec_all() All are named as bio_*_all() to following bio_for_each_segment_all(), they can only be used on bio of !bio_flagged(bio, BIO_CLONED), that means the whole bvec table is covered. Signed-off-by:
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- 05 Jan, 2018 29 commits
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Paolo Valente authored
Commit a33801e8 ("block, bfq: move debug blkio stats behind CONFIG_DEBUG_BLK_CGROUP") introduced two batches of confusing ifdefs: one reported in [1], plus a similar one in another function. This commit removes both batches, in the way suggested in [1]. [1] https://www.spinics.net/lists/linux-block/msg20043.html Fixes: a33801e8 ("block, bfq: move debug blkio stats behind CONFIG_DEBUG_BLK_CGROUP") Reported-by:
Linus Torvalds <torvalds@linux-foundation.org> Tested-by:
Luca Miccio <lucmiccio@gmail.com> Signed-off-by:
Paolo Valente <paolo.valente@linaro.org> Signed-off-by:
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Paolo Valente authored
BFQ privileges the I/O of soft real-time applications, such as video players, to guarantee to these application a high bandwidth and a low latency. In this respect, it is not easy to correctly detect when an application is soft real-time. A particularly nasty false positive is that of an I/O-bound application that occasionally happens to meet all requirements to be deemed as soft real-time. After being detected as soft real-time, such an application monopolizes the device. Fortunately, BFQ will realize soon that the application is actually not soft real-time and suspend every privilege. Yet, the application may happen again to be wrongly detected as soft real-time, and so on. As highlighted by our tests, this problem causes BFQ to occasionally fail to guarantee a high responsiveness, in the presence of heavy background I/O workloads. The reason is that the background workload happens to be detected as soft real-time, more or less frequently, during the execution of the interactive task under test. To give an idea, because of this problem, Libreoffice Writer occasionally takes 8 seconds, instead of 3, to start up, if there are sequential reads and writes in the background, on a Kingston SSDNow V300. This commit addresses this issue by leveraging the following facts. The reason why some applications are detected as soft real-time despite all BFQ checks to avoid false positives, is simply that, during high CPU or storage-device load, I/O-bound applications may happen to do I/O slowly enough to meet all soft real-time requirements, and pass all BFQ extra checks. Yet, this happens only for limited time periods: slow-speed time intervals are usually interspersed between other time intervals during which these applications do I/O at a very high speed. To exploit these facts, this commit introduces a little change, in the detection of soft real-time behavior, to systematically consider also the recent past: the higher the speed was in the recent past, the later next I/O should arrive for the application to be considered as soft real-time. At the beginning of a slow-speed interval, the minimum arrival time allowed for the next I/O usually happens to still be so high, to fall *after* the end of the slow-speed period itself. As a consequence, the application does not risk to be deemed as soft real-time during the slow-speed interval. Then, during the next high-speed interval, the application cannot, evidently, be deemed as soft real-time (exactly because of its speed), and so on. This extra filtering proved to be rather effective: in the above test, the frequency of false positives became so low that the start-up time was 3 seconds in all iterations (apart from occasional outliers, caused by page-cache-management issues, which are out of the scope of this commit, and cannot be solved by an I/O scheduler). Tested-by:
Lee Tibbert <lee.tibbert@gmail.com> Signed-off-by:
Angelo Ruocco <angeloruocco90@gmail.com> Signed-off-by:
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Angelo Ruocco authored
When two or more processes do I/O in a way that the their requests are sequential in respect to one another, BFQ merges the bfq_queues associated with the processes. This way the overall I/O pattern becomes sequential, and thus there is a boost in througput. These cooperating processes usually start or restart to do I/O shortly after each other. So, in order to avoid merging non-cooperating processes, BFQ ensures that none of these queues has been in weight raising for too long. In this respect, from commit "block, bfq-sq, bfq-mq: let a queue be merged only shortly after being created", BFQ checks whether any queue (and not only weight-raised ones) is doing I/O continuously from too long to be merged. This new additional check makes the first one useless: a queue doing I/O from long enough, if being weight-raised, is also a queue in weight raising for too long to be merged. Accordingly, this commit removes the first check. Signed-off-by:
Paolo Valente <paolo.valente@linaro.com> Signed-off-by:
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Paolo Valente authored
In BFQ and CFQ, two processes are said to be cooperating if they do I/O in such a way that the union of their I/O requests yields a sequential I/O pattern. To get such a sequential I/O pattern out of the non-sequential pattern of each cooperating process, BFQ and CFQ merge the queues associated with these processes. In more detail, cooperating processes, and thus their associated queues, usually start, or restart, to do I/O shortly after each other. This is the case, e.g., for the I/O threads of KVM/QEMU and of the dump utility. Basing on this assumption, this commit allows a bfq_queue to be merged only during a short time interval (100ms) after it starts, or re-starts, to do I/O. This filtering provides two important benefits. First, it greatly reduces the probability that two non-cooperating processes have their queues merged by mistake, if they just happen to do I/O close to each other for a short time interval. These spurious merges cause loss of service guarantees. A low-weight bfq_queue may unjustly get more than its expected share of the throughput: if such a low-weight queue is merged with a high-weight queue, then the I/O for the low-weight queue is served as if the queue had a high weight. This may damage other high-weight queues unexpectedly. For instance, because of this issue, lxterminal occasionally took 7.5 seconds to start, instead of 6.5 seconds, when some sequential readers and writers did I/O in the background on a FUJITSU MHX2300BT HDD. The reason is that the bfq_queues associated with some of the readers or the writers were merged with the high-weight queues of some processes that had to do some urgent but little I/O. The readers then exploited the inherited high weight for all or most of their I/O, during the start-up of terminal. The filtering introduced by this commit eliminated any outlier caused by spurious queue merges in our start-up time tests. This filtering also provides a little boost of the throughput sustainable by BFQ: 3-4%, depending on the CPU. The reason is that, once a bfq_queue cannot be merged any longer, this commit makes BFQ stop updating the data needed to handle merging for the queue. Signed-off-by:
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Angelo Ruocco authored
A just-created bfq_queue will certainly be deemed as interactive on the arrival of its first I/O request, if the low_latency flag is set. Yet, if the queue is merged with another queue on the arrival of its first I/O request, it will not have the chance to be flagged as interactive. Nevertheless, if the queue is then split soon enough, it has to be flagged as interactive after the split. To handle this early-merge scenario correctly, BFQ saves the state of the queue, on the merge, as if the latter had already been deemed interactive. So, if the queue is split soon, it will get weight-raised, because the previous state of the queue is resumed on the split. Unfortunately, in the act of saving the state of the newly-created queue, BFQ doesn't check whether the low_latency flag is set, and this causes early-merged queues to be then weight-raised, on queue splits, even if low_latency is off. This commit addresses this problem by adding the missing check. Signed-off-by:
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Paolo Valente authored
If two processes do I/O close to each other, then BFQ merges the bfq_queues associated with these processes, to get a more sequential I/O, and thus a higher throughput. In this respect, to detect whether two processes are doing I/O close to each other, BFQ keeps a list of the head-of-line I/O requests of all active bfq_queues. The list is ordered by initial sectors, and implemented through a red-black tree (rq_pos_tree). Unfortunately, the update of the rq_pos_tree was incomplete, because the tree was not updated on the removal of the head-of-line I/O request of a bfq_queue, in case the queue did not remain empty. This commit adds the missing update. Signed-off-by:
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Paolo Valente authored
If two processes do I/O close to each other, i.e., are cooperating processes in BFQ (and CFQ'S) nomenclature, then BFQ merges their associated bfq_queues, so as to get sequential I/O from the union of the I/O requests of the processes, and thus reach a higher throughput. A merged queue is then split if its I/O stops being sequential. In this respect, BFQ deems the I/O of a bfq_queue as (mostly) sequential only if less than 4 I/O requests are random, out of the last 32 requests inserted into the queue. Unfortunately, extensive testing (with the interleaved_io benchmark of the S suite [1], and with real applications spawning cooperating processes) has clearly shown that, with such a low threshold, only a rather low I/O throughput may be reached when several cooperating processes do I/O. In particular, the outcome of each test run was bimodal: if queue merging occurred and was stable during the test, then the throughput was close to the peak rate of the storage device, otherwise the throughput was arbitrarily low (usually around 1/10 of the peak rate with a rotational device). The probability to get the unlucky outcomes grew with the number of cooperating processes: it was already significant with 5 processes, and close to one with 7 or more processes. The cause of the low throughput in the unlucky runs was that the merged queues containing the I/O of these cooperating processes were soon split, because they contained more random I/O requests than those tolerated by the 4/32 threshold, but - that I/O would have however allowed the storage device to reach peak throughput or almost peak throughput; - in contrast, the I/O of these processes, if served individually (from separate queues) yielded a rather low throughput. So we repeated our tests with increasing values of the threshold, until we found the minimum value (19) for which we obtained maximum throughput, reliably, with at least up to 9 cooperating processes. Then we checked that the use of that higher threshold value did not cause any regression for any other benchmark in the suite [1]. This commit raises the threshold to such a higher value. [1] https://github.com/Algodev-github/SSigned-off-by:
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Damien Le Moal authored
Introduce zone write locking to avoid write request reordering with zoned block devices. This is achieved using a finer selection of the next request to dispatch: 1) Any non-write request is always allowed to proceed. 2) Any write to a conventional zone is always allowed to proceed. 3) For a write to a sequential zone, the zone lock is first checked. a) If the zone is not locked, the write is allowed to proceed after its target zone is locked. b) If the zone is locked, the write request is skipped and the next request in the dispatch queue tested (back to step 1). For a write request that has locked its target zone, the zone is unlocked either when the request completes and the method deadline_request_completed() is called, or when the request is requeued using the method deadline_add_request(). Requests targeting a locked zone are always left in the scheduler queue to preserve the initial write order. If no write request can be dispatched, allow reads to be dispatched even if the write batch is not done. If the device used is not a zoned block device, or if zoned block device support is disabled, this patch does not modify deadline behavior. Signed-off-by:Damien Le Moal <damien.lemoal@wdc.com> Reviewed-by:
Martin K. Petersen <martin.petersen@oracle.com> Signed-off-by:
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Damien Le Moal authored
Avoid directly referencing the next_rq and fifo_list arrays using the helper functions deadline_next_request() and deadline_fifo_request() to facilitate changes in the dispatch request selection in deadline_dispatch_requests() for zoned block devices. While at it, also remove the unnecessary forward declaration of the function deadline_move_request(). Signed-off-by:
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Damien Le Moal authored
Introduce zone write locking to avoid write request reordering with zoned block devices. This is achieved using a finer selection of the next request to dispatch: 1) Any non-write request is always allowed to proceed. 2) Any write to a conventional zone is always allowed to proceed. 3) For a write to a sequential zone, the zone lock is first checked. a) If the zone is not locked, the write is allowed to proceed after its target zone is locked. b) If the zone is locked, the write request is skipped and the next request in the dispatch queue tested (back to step 1). For a write request that has locked its target zone, the zone is unlocked either when the request completes with a call to the method deadline_request_completed() or when the request is requeued using dd_insert_request(). Requests targeting a locked zone are always left in the scheduler queue to preserve the lba ordering for write requests. If no write request can be dispatched, allow reads to be dispatched even if the write batch is not done. If the device used is not a zoned block device, or if zoned block device support is disabled, this patch does not modify mq-deadline behavior. Signed-off-by: -
Damien Le Moal authored
Avoid directly referencing the next_rq and fifo_list arrays using the helper functions deadline_next_request() and deadline_fifo_request() to facilitate changes in the dispatch request selection in __dd_dispatch_request() for zoned block devices. Signed-off-by:
Bart Van Assche <Bart.VanAssche@wdc.com> Reviewed-by:
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Christoph Hellwig authored
Components relying only on the request_queue structure for accessing block devices (e.g. I/O schedulers) have a limited knowledged of the device characteristics. In particular, the device capacity cannot be easily discovered, which for a zoned block device also result in the inability to easily know the number of zones of the device (the zone size is indicated by the chunk_sectors field of the queue limits). Introduce the nr_zones field to the request_queue structure to simplify access to this information. Also, add the bitmap seq_zone_bitmap which indicates which zones of the device are sequential zones (write preferred or write required) and the bitmap seq_zones_wlock which indicates if a zone is write locked, that is, if a write request targeting a zone was dispatched to the device. These fields are initialized by the low level block device driver (sd.c for ZBC/ZAC disks). They are not initialized by stacking drivers (device mappers) handling zoned block devices (e.g. dm-linear). Using this, I/O schedulers can introduce zone write locking to control request dispatching to a zoned block device and avoid write request reordering by limiting to at most a single write request per zone outside of the scheduler at any time. Based on previous patches from Damien Le Moal. Signed-off-by:
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Bart Van Assche authored
Call bdev_get_queue(bdev) after bdev->bd_disk has been initialized instead of just before that pointer has been initialized. This patch avoids that the following command pktsetup 1 /dev/sr0 triggers the following kernel crash: BUG: unable to handle kernel NULL pointer dereference at 0000000000000548 IP: pkt_setup_dev+0x2db/0x670 [pktcdvd] CPU: 2 PID: 724 Comm: pktsetup Not tainted 4.15.0-rc4-dbg+ #1 Call Trace: pkt_ctl_ioctl+0xce/0x1c0 [pktcdvd] do_vfs_ioctl+0x8e/0x670 SyS_ioctl+0x3c/0x70 entry_SYSCALL_64_fastpath+0x23/0x9a Reported-by:
Maciej S. Szmigiero <mail@maciej.szmigiero.name> Fixes: commit ca18d6f7 ("block: Make most scsi_req_init() calls implicit") Signed-off-by:
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Bart Van Assche authored
Commit 523e1d39 ("block: make gendisk hold a reference to its queue") modified add_disk() and disk_release() but did not update any of the error paths that trigger a put_disk() call after disk->queue has been assigned. That introduced the following behavior in the pktcdvd driver if pkt_new_dev() fails: Kernel BUG at 00000000e98fd882 [verbose debug info unavailable] Since disk_release() calls blk_put_queue() anyway if disk->queue != NULL, fix this by removing the blk_cleanup_queue() call from the pkt_setup_dev() error path. Fixes: commit 523e1d39 ("block: make gendisk hold a reference to its queue") Signed-off-by:
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Matias Bjørling authored
Shorten function to simply return the value of the if statement. Signed-off-by:
Matias Bjørling <m@bjorling.me> Signed-off-by:
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Javier González authored
Since pblk registers its own block device, the iostat accounting is not automatically done for us. Therefore, add the necessary accounting logic to satisfy the iostat interface. Signed-off-by:
Javier González <javier@cnexlabs.com> Signed-off-by:
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Javier González authored
Add the instance name to the information printed out on target creation. Signed-off-by:
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Javier González authored
Refactor the way we free the write buffer to ensure that all entries get freed in case of an error on the init sequence. Signed-off-by:
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Javier González authored
When creating the write thread, ensure that the kthread has been created before initializing the timer responsible from kicking it. Otherwise, if the kthread creation fails or gets killed from used space, we risk kicking an empty thread structure. Also, since the kthread creation can be interrupted form user space, adapt the error path to not report an error when this happens, since it is intentional that the instance creation is aborted. Signed-off-by:
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Javier González authored
On scan recovery, reads can fail. This happens because the first page for each line is read in order to determined if the line has been used (and thus needs to be recovered), or not. This can lead to "empty page" read errors. Since these errors are normal, do not log them, as they are confusing when reviewing the logs. Signed-off-by:
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Javier González authored
On recovery, do not stop L2P recovery if reads report high ECC error as the data is still available. Signed-off-by:
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Javier González authored
Allow to set the over-provision percentage on target creation. In case that the value is not provided, fall back to the default value set by the target. In pblk, set the default OP to 11% of the total size of the device Signed-off-by:
Hans Holmberg <hans.holmberg@cnexlabs.com> Signed-off-by:
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Javier González authored
Until now, pblk's rate-limiter has used a heuristic to reserve space for GC I/O given that the over-provision area was fixed. In preparation for allowing to define the over-provision area on target creation, define a dedicated free_block counter in the rate-limiter to track the number of blocks being used for user data. Signed-off-by:
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Hans Holmberg authored
pblk_gc_stop just sets pblk->gc->gc_active to zero, ignoring the flush parameter. This is plain confusing, so remove the function and set the gc active flag at the call points instead. Signed-off-by:
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Hans Holmberg authored
Unless we protect flush pointer updates with a lock, we risk resetting new flush points before we've synced all sectors up to that point. This patch protects new flush points with the same spin lock that is being held when advancing the sync pointer and resetting completed flush points. Signed-off-by:
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Hans Holmberg authored
Move completion of syncs and clearing of flush points to the write completion path - this ensures that the data has been comitted to the media before completing bios containing syncs. Signed-off-by:
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Hans Holmberg authored
Sync point is a really confusing name for keeping track of the last entry that needs to be flushed so change the name to to flush_point instead. Signed-off-by:
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Hans Holmberg authored
Currently pblk_recov_get_lba list does two separate things: it checks the consistency of the emeta and extracts the lba list. This patch separates the consistency check to make the code easier to read and to prepare for version checks of the line emeta persistent data format version. Signed-off-by:
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Javier González authored
Signed-off-by:
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