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MySQL 8.0: New Lock free, scalable WAL design
June 18, 2018InnoDB, IO, PerformanceREDO, WALPaweł Olchawa
The Write Ahead Log (WAL) is one of the most important components of a database. All the changes to data files are logged in the WAL (called the redo log in InnoDB). This allows to postpone the moment when the modified pages are flushed to disk, still protecting from data losses.
The write intense workloads had performance limited by synchronization in which many user threads were involved, when writing to the redo log. This was especially visible when testing performance on servers with multiple CPU cores and fast storage devices, such as modern SSD disks.
We needed a new design that would address the problems faced by our customers and users today and also in the future. Tweaking the old design to achieve scalability was not an option any more. The new design also had to be flexible, so that we can extend it to do sharding and parallel writes in the future. With the new design we wanted to ensure that it would work with the existing APIs and most importantly not break the contract that the rest of InnoDB relies on. A challenging task under these constraints.
Redo log can be seen as a producer/consumer persistent queue. The user threads that do updates can be seen as the producers and when InnoDB has to do crash recovery the recovery thread is the consumer. InnoDB doesn’t read from the redo log when the server is running.
But writing a scalable log with multiple producers is only one part of the problem. There are InnoDB specific details that also need to work. The biggest challenge was to preserve the total order of the dirty page list (a.k.a the flush list). There is one per buffer pool. Changes to pages are applied within so-called mini transactions (mtr), which allow to modify multiple pages in atomic way. When a mini transaction commits, it writes its own log records to the log buffer, increasing the global modification number called LSN (Log Sequence Number). The mtr has the list of dirty pages that need to be added to the buffer pool specific flush list. Each flush list is ordered on the LSN. In the old design we held the log_sys_t::mutex and the log_sys_t::flush_order_mutex in a lock step manner to ensure that the total order on modification LSN was maintained in the flush lists.
Note that when some mtr was adding its dirty pages (holding flush_order_mutex), another thread could be waiting to acquire the flush_order_mutex (even if it wanted to add pages to other flush list). In such case the waiting thread was holding log_sys_t::mutex (to maintain the total order), so any other thread that wanted to write to the log buffer had to wait… With the removal of these mutexes there is no guarantee on the order of the flush list.
Second problem is that we cannot write the full log buffer to disk because there could be holes in the LSN sequence, because writes to the log buffer are not finished in any particular order.
The solution for the second problem is to track which writes were finished, and for that we invented a new lock-free data structure.
The new data structure has a fixed size array of slots. The slots are updated in atomic way and reused in a circular fashion. A single thread is used to traverse and clear them, making a pause at a hole (empty slot). This thread updates the maximum reachable LSN (M).Two instances of this data structure are used: the recent_written and the recent_closed. The recent_written instance is used for tracking the finished writes to the log buffer. It can provide maximum LSN, such that all writes to the log buffer, for smaller LSN values, were finished. Potential crash recovery would need to end at such LSN, so it is a maximum LSN up to which we consider a next write. The slots are traversed by the same thread that writes the log buffer to disk afterwards. The proper memory ordering for reads and writes to the log buffer is guaranteed by the barriers set when reading/writing the slots.
Let’s look at the picture above. Suppose that we finished one more write to the log buffer:
Now, the dedicated thread (log_writer) comes in, traverses the slots:
and updates the maximum LSN reachable without the holes – buf_ready_for_write_lsn:
The recent_closed instance of the new data structure is used to address problems related to the missing log_sys_t::flush_order_mutex. To understand the flush list order problem and the lock free solution there is a little more detail required to explain.
Individual flush lists are protected by their internal mutexes. But we no longer preserve the guarantee that we add dirty pages to flush lists in the order of increasing LSN values. However, the two constraints that must be satisfied are:
Checkpoint – We must not write fuzzy checkpoint at LSN = L2, if there is a dirty page for LSN = L1, where L1 < L2. That’s because recovery starts at such checkpoint_lsn.
Flushing – Flushing by flush list should always be from the oldest page in the flush list. This way we prefer to flush pages that were modified long ago, and also help to advance the checkpoint_lsn.
In the recent_closed instance we track the concurrent executions of adding dirty pages to the flush lists, and track the maximum LSN (called M), such that all executions, for smaller LSN values have completed. Before a thread adds its dirty pages to the flush lists, it waits until M is not that far away. Then it adds the pages and then reports the finished operation to the recent_closed.
Let’s take an example. Suppose that some mtr, during its commit, copied all its log records to the log buffer for LSN range between start_lsn and end_lsn. It reported the finished write to the recent_written (the log records might be written to disk since now). Then the mtr must wait until it holds: start_lsn – M = last_lsn. In the new design it is only guaranteed that all the pages in the flush list have oldest_modification >= last_lsn – L. The condition holds because we always wait if M is too far away before inserting pages.
Proof. Let’s suppose we had two pages: P1 with LSN = L1, and P2 with LSN = L2, and P1 was added to flush list first, but L2 < L1 – L. Before P1 was inserted we ensured that L1 – M < L. We had M L1 – M >= L1 – L2, so L2 > L1 – L. Contradiction – we assumed that L2 = X, selects a shard to which the X belongs. This decreases the synchronization required when attempting a wait. But what is even more important, thanks to such split, we can wake up only these threads that will be happy with the advanced flushed_to_disk_lsn (except some of those waiting in the last block).
When flushed_to_disk_lsn is advanced, the log_flush_notifier thread wakes up threads waiting on intermediate values of LSN. Note that when log_flush_notifier is busy with the notifications, next fsync() call could be started within the log_flusher thread!
The same approach is used when innodb_flush_log_at_trx_commit =2, in which case users don’t care about fsyncs() that much and wait only for finished writes to OS cache (they are notified by the log_write_notifier thread in such case, which synchronizes with the log_writer thread on the write_lsn).
Because waiting on an event and being woken up increases latency, there is an optional spin-loop which might be used in front of that. It’s by default being used unless we don’t have too much free CPU resources on the server. You can control that via new dynamic system variables: innodb_log_spin_cpu_abs_lwm, and innodb_log_spin_cpu_pct_hwm.
As we mentioned at the very beginning, redo log can be seen as producer/consumer queue. InnoDB relies on fuzzy checkpoints from which potential recovery would need to start. By flushing dirty pages, InnoDB allows to move the checkpoint LSN forward. This allows us to reclaim free space in the redo log (blocks before the checkpoint LSN are basically considered free) and also makes a potential recovery faster (shorter queue).
In the old design user threads were competing with each other when selecting the one that will write the next checkpoint. In the new design there is a dedicated log_checkpointer thread that monitors what are the oldest pages in flush lists and decides to write the next checkpoint (according to multiple criteria). That’s why no longer the master thread has to take care of periodical checkpoints. With the new lock free design we have also decreased the default period from 7s to 1s. This is because we can handle transactions much faster since the 7s were set (we write more data/s so faster potential recovery was the motivation for this change).
The new WAL design provides higher concurrency when updating data and a very small (read negligible) synchronization overhead between user threads!
Let’s have a look at simple comparison made between version just before the new redo log, and just after. It’s a sysbench oltp update_nokey test for 8 tables, each with 10M rows, innodb_flush_log_at_trx_commit = 1.
For details about different tests please read: http://dimitrik.free.fr/blog/archives/2018/05/mysql-performance-80-and-sysbench-oltp_rw-updatenokey.html
Thank you for using MySQL !
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About Paweł Olchawa
InnoDB developer, co-founder of polish social network – nk.pl. View all posts by Paweł Olchawa →
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I received my Bachelors (Electrical Engineering) and Masters (Embedded Systems) from Eindhoven University of Technology. In April 2014, I successfully defended my PhD thesis at the same university. During the PhD I gained experience through two internships: with the OpenCL compiler group of ARM in Cambridge (UK), and with the cuFFT team of NVIDIA in Santa Clara (CA). After that, I worked as a GPU consultant at the SURFsara supercomputing centre and as a C++ performance engineer for a computer vision and machine learning team at Blippar. Currently, I work at TomTom on deep learning for autonomous driving.
Interests and expertise
My main expertise is C++11/14 and GPU programming (CUDA/OpenCL). On top of this, I also have experience with Python, compilers, high-performance computing, computer architecture, performance modelling, computer vision, and machine learning / deep learning.
My passion lies with the development of beautiful and performant C++11 codes, possibly accelerated by GPUs. Examples are CLTune, an OpenCL auto-tuner, and CLBlast, an OpenCL BLAS library.
Profiles on other pages
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R&D engineer performance optimization
I worked as a C++11 performance engineer on computer vision and machine learning algorithms for an augmented reality company. My work included multi-threading, vectorisation and GPU-acceleration.
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I worked as a consultant for the Dutch national supercomputing/HPC centre, specialised in accelerator programming (Xeon Phi, GPU). My job involves tuning scientific codes (C/C++/Fortran) for multi-cores (OpenMP), multiple nodes (MPI), and accelerators (OpenCL/CUDA). I have worked on codes from various domains, including finite element methods, fluid dynamics, and quantum chemistry.
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adamnew123456 / SmallWM
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What is SmallWM?
SmallWM is an extended version of TinyWM, made for actual desktop use.
Screenshot of SmallWM
Improvements over TinyWM
Click-To-Focus and Focus Cycling
Multiple Virtual Desktops
Note that these are the default controls. See the Configuration for details on how to setup keybindings. The only non-configurable key bindings are the ones that involve clicking the mouse, and the Super+1 … Super+9 bindings.
Super+[: Move a window to the previous desktop (client-prev-desktop).
Super+]: Move a window to the next desktop (client-next-desktop).
Super+,: Switch to the previous desktop (prev-desktop).
Super+.: Switch to the next desktop (next-desktop).
Super+\: Sticks/unsticks a window; a stuck window is shown on all desktops (toggle-stick).
Super+h: Iconifies the current window (iconify).
Super+m: Maximizes the current window (maximize).
Super+c, Requests the current window to close (request-close).
Super+x: Force-closes the current window (force-close).
Super+Up, Super+Down, Super+Left, Super+Right: Snaps a window to either the top-half, bottom-half, left-half or right-half of the screen.
Actions: snap-top, snap-bottom, snap-left, snap-right
Super+Ctrl+Up, Super+Ctrl+Down, …: Moves a window to the screen in the relative direction of the arrow key.
Actions: screen-top, screen-bottom, screen-left, screen-right
Super+PageUp, Super+PageDown: Increments or decrements the layer of this window.
Actions: layer-above, layer-below
Super+Home, Super+End: Puts a window on the topmost or bottommost layer.
Actions: layer-top, layer-bottom
Super+Tab: Focuses the next visible window in the focus list (cycle-focus).
Super-Alt-Tab: Focuses the previous visible window in the focus list (cycle-focus-back)
Super+LClick: Dragging the left mouse button starts moving a window – to place it, let go.
Super+RClick: Dragging the right mouse button starts resizing a window – to scale it, let go.
Super+1 … Super+5 … Super+9: These change the layer to the specified value (1, 5, or 9 respectively, in this example)
Super+LClick: Left-clicking the root window launches a new terminal.
Super+Escape: Quits SmallWM.
As a dependency, you’ll need to have access to the headers for Xlib and XRandR. You should be able to easily obtain these via your package manager. You’ll also need a C++ compiler – GNU G++ and clang++ work well. You’ll also need a C compiler to build the inih library included with SmallWM – GNU C and clang work well for this purpose also.
Other than the dependencies, the Makefile contains everything you need to build and test SmallWM.
make compiles a version with symbols useful for debugging. Note that there is no optimized build – if you want an optimized version, open the Makefile and change -g to -O3 in CXXFLAGS.
For modifying SmallWM, the other target that you should be aware of is make check which compiles everything but does no linking. This is useful for incremental building to track compiler errors in source files.
Typically, the easiest place to put the smallwm binary is in /usr/local/bin.
If you want to run SmallWM from your login manager, you should put a file like the following in /usr/share/xsessions/smallwm.desktop:
Inside the script /usr/local/bin/smallwm.sh, you should enter something like the following:
if [ -x $HOME/.smallwmrc ]; then
At this point, you may choose to write a .smallwmrc file to start any programs you wish to run for the duration of your session. Note that SmallWM does not include a process manager to handle session programs (unlike say, XFCE, which will restart components like the panel or the desktop if they crash). I use a tool I wrote myself, called jobmon, to manage my system tray and other programs, but you are free to choose whatever process manager you like, since SmallWM doesn’t care about it.
The C++ version follows a similar configuration file format to the original C version, but with some extended options. It should be placed at $HOME/.config/smallwm.
The options in the [smallwm] section are (in order):
shell The shell launched by Super+LClick (default: xterm). This can be any syntax supported by /bin/sh.
desktops The number of desktops (default: 5).
icon-width The width in pixels of icons (default: 75).
icon-height The height in pixels of icons (default: 20).
border-width The width of the border of windows (default: 4).
icon-icons Whether to (1) or not to (0) show application icons inside icon windows (default: 1).
log-level The severity of logging messages to send to syslog. By default, this is WARNING. See syslog(3) for the other log levels.
hotkey-mode What window to apply hotkeys like MINIMIZE to – this can be either focus (which means that the currently focused window is acted upon) or mouse (which means that the window under the cursor is acted upon). The default is mouse.
dump-file This is where SmallWM writes internal information dumps when you send it SIGUSR1. This is intended for development purposes only; although it will generally contain information about SmallWM’s desktops, clients and screens, this information is for human consumption and its format is not guaranteed to stay the same. By default, this value is /dev/null, so that any dumps SmallWM generates are not stored anywhere.
X has the notion of an application “class” which is supposed to be a unique identifier for a window which belongs to a particular application. For example, there is a popular system tray called stalonetray which I use personally to manage status notifiers (like for NetworkManager, Dropbox, and the like). A quick xprop of the window shows that its class name is stalonetray.
The example given in the Configuration section shows how to stick any window belonging to stalonetray and layer it on top of all other application windows. Generally speaking, any number of these class actions can be chained together by separating them with commas.
The possibilities for a class action are:
stick makes a particular window stick to all the desktops.
maximize maximizes that window.
layer:x sets the layer of the window to x where x is a number in the range 1 to 9; 9 is the highest layer, 1 is the lowest.
snap:left, snap:right, snap:top, snap:bottom snap the window to the relevant side of the screen.
xpos:X and ypos:Y set the relative position of the window on the screen. X and Y are decimals in the range 0 to 100, inclusive. For example, setting xpos:50 puts the window’s left edge in the middle of the screen (because xpos:50 is equivalent to saying that the X position should be 50 percent of the screen’s width).
pack:CORNERPRIORITY directs SmallWM to fix the position of a group of windows, re-adjusting when they are resized. The CORNER is one of NE, SE, NW or SW (indicating the upper-left, lower-left, upper-right and lower-right corners respectively), and the optional PRIORITY is a non-negative integer (0 by default). See the Packing section below.
nofocus prevents SmallWM from automatically focusing windows of the given class. This is useful for windows like system trays, clocks, or other utility windows that you don’t want to manipulate by accident.
It is important to know that xpos/ypos and pack are mutually exclusive – whatever is listed last in a class’s action list is what is applied. For example, packme is packed but posme is relative-positioned:
Packing allows SmallWM to automatically position windows, according to a very simple set of rules. However, when a window is packed, you lose the ability to manually move and resize it.
The way that the packer works is that it looks at each corner of the screen individually. It then looks at the packed windows, and starts placing them in order of priority, with the lowest priority elements going closest to the corner.
For example, if you have 3 windows:
| A |
| C |
With the priorities:
And you want to pack them into the northeast corner, the result will look like the following; A, the lowest priority, is first placed directly into the corner, with B horizontally placed on the side of A opposite the corner, and then C placed on the edge of B.
| C |B| A |
SmallWM currently does not have a way to pack on secondary monitors (it will always choose the primary minitor), or a way to pack vertically.
Keyboard bindings in SmallWM are almost entirely (except for Super+1 … Super+9) configurable. The mechanism isn’t that sophisticated, so make sure that you have a copy of /usr/include/X11/keysymdef.h or an equivalent file open.
In order to bind a key, you first have to know the name of the “keysym” that the key uses. To do this, search keysymdef.h for your key – the keysym name is the first word after the #define. The text that you put in the configuration file is the keysym name but with the leading XK_ removed. For example, take toggle-stick=asciitilde in the example configuration file. This binds the toggle-stick action to the XK_asciitilde keysym.
The following options can be set under the [keyboard] section to configure SmallWM’s keyboard bindings.
These bindings move the current window to either the next or previous desktop
These bindings move the view the next or previous desktop
This toggles the desktop stickiness of the current window
This iconifies the current window
This maximizes the current window
This requests that the current window close, allowing the application to show save prompts and the like.
This forces the current window to close. Only use this is an emergency – most applications will crash after you do this.
snap-top, snap-bottom, snap-left, snap-right
Snaps the current window to the top, bottom, left or right half of the screen.
screen-left, screen-right, screen-top, screen-bottom
Moves the current window to the screen to the left of, to the right of, above, or below the current screen it occupies.
Moves the current window to the layer above or below its current layer.
Moves the current window to the topmost or bottommost layer
Changes the focused window to the window next (or previous)in the focus list.
Note the key binding given for snap-right in the example – the ! that prefixes the ‘a’ is used to indicate that this key bindings uses a secondary modifier key (Control, by default). In order to activate snap-left, you need to press Super+Ctrl+a rather than just Super+a. Only the key bindings used to move windows between screens use this by default.
Support for the EWMH and the _NET* atoms
Nick Welch email@example.com, the original TinyWM author.
Myself (Adam Marchetti firstname.lastname@example.org).
The author(s) of the inih library.
Possibly, you – assuming you make any useful changes and I accept your pull request. Refactorings are welcome, as are those who are actually knowledgeable about Xorg and could spot any obvious mistakes.
SmallWM was migrated to the 2-Clause BSD License on 2013-11-18. See LICENSE.txt for details.
The inih code, included as a part of SmallWM, is available under the New BSD License. See inih/LICENSE.txt for details.