应该说搞分布式系统必读的文章了，转过来，这是2008年12月Werner revise过的版本，先贴上内容简介：
分布式系统的CAP理论
CAP理论（data consistency, system availability, and tolerance），也就是数据一致性，系统可用性和网络分区容错性，在一个分布式系统中CAP是不能同时保证的，最多只能同时满足两个。
如果一个系统不必考虑网络分区容错性，那么它可以同时取得数据一致性和可用性，这通常可以通过处理协议来保证。
然而不考虑网络分区容错性，那还叫分布式系统吗？因此在分布式系统中，不能同时保证数据一致性和可用性。因此作为软件设计者，你必须首先搞清楚你的系统到底什么才是最重要的，一致性还是可用性？再去做设计。
一致性模型
从客户端来看，文中把系统的一致性模型分层了3类：
1 强一致性，系统中的某个数据B更新后，后续任何对B的读取操作得到的都是更新后的值；
2 弱一致性，系统中的某个数据B更新后，后续对B的读取操作得到的不一定是更新后的值；从数据B更新，到后续读取操作读取到B的最新值会有一段延时，这个时间又叫作：“不一致性窗口”（inconsistency window）；
3 最终一致性，弱一致性的特例，首先依然是数据B被更新，如果后续B没有被再次更新，那么系统会保证，最后所有的读取操作都会返回最新的值。如果没有错误发生，不一致窗口的最大值可以根据下列因素确定：通信延迟、系统负载、复制方案涉及的副本数量。DNS就是使用最终一致性的例子。
最终一致性的几个变体：
因果一致性，你写完之后，通知别人，被通知的人就能读取更新后的值了；
“读自己写的”一致性，你写了以后，自己再次读总能读到更新后的值；
会话一致性，只要会话还存在，系统就保证“读自己写的”一致性；
单调读一致性，简单来讲，数据不会越读越旧；
单调写一致性，同一个进程的写操作肯定是顺序的，不然怎么coding啊；
从服务端来看一致性，我们需要比较深入的分析数据的更新流程，首先假定：
N：副本数；
W：更新完成前，必须确认已经被更新的副本数；
R：读取操作时，必须读取数据的副本数；
如果W+R>N，那么系统就能保证强一致性，因为读取数据的节点和被同步写入的节点是有重叠的；
W，R和N的值需要根据系统的设计目标来配置，通常在分布式系统中出于容错性的要求， N都是一般大于3的；比如：R=1，W=N的配置是为了高可读性，W=N意味着写入时N个副本必须都成功，这会降低写入操作的成功率；如果系统关心容错性而不关心一致性时，可以配置W=1，然后再异步更新剩余的N-W个副本；
弱/最终一致性的产生是当W+R<=N，这意味着存在读写操作可能不会重叠。
每个客户端应用对服务器造成的不一致性都有自己的耐受力，但在任何情况下，客户端应用都应该知道服务器应用提供的一致性水平。
Eventually Consistent
I wrote a first version of this posting on consistency models about a year ago, but I was never happy with it as it was written in haste and the topic is important enough to receive a more thorough treatment. ACM Queueasked me to revise it for use in their magazine and I took the opportunity to improve the article. This is that new version.
Eventually Consistent - Building reliable distributed systems at a worldwide scale demands trade-offs between consistency and availability.
At the foundation of Amazon‘s cloud computing are infrastructure services such as Amazon‘s S3 (Simple Storage Service), SimpleDB, and EC2 (Elastic Compute Cloud) that provide the resources for constructing Internet-scale computing platforms and a great variety of applications. The requirements placed on these infrastructure services are very strict; they need to score high marks in the areas of security, scalability, availability, performance, and cost effectiveness, and they need to meet these requirements while serving millions of customers around the globe, continuously.
Under the covers these services are massive distributed systems that operate on a worldwide scale. This scale creates additional challenges, because when a system processes trillions and trillions of requests, events that normally have a low probability of occurrence are now guaranteed to happen and need to be accounted for up front in the design and architecture of the system. Given the worldwide scope of these systems, we use replication techniques ubiquitously to guarantee consistent performance and high availability. Although replication brings us closer to our goals, it cannot achieve them in a perfectly transparent manner; under a number of conditions the customers of these services will be confronted with the consequences of using replication techniques inside the services.
One of the ways in which this manifests itself is in the type of data consistency that is provided, particularly when the underlying distributed system provides an eventual consistency model for data replication. When designing these large-scale systems at Amazon, we use a set of guiding principles and abstractions related to large-scale data replication and focus on the trade-offs between high availability and data consistency. In this article I present some of the relevant background that has informed our approach to delivering reliable distributed systems that need to operate on a global scale. An earlier version of this text appeared as a posting on the All Things Distributed weblog in December 2007 and was greatly improved with the help of its readers.
Historical Perspective
In an ideal world there would be only one consistency model: when an update is made all observers would see that update. The first time this surfaced as difficult to achieve was in the database systems of the late ‘70s. The best "period piece" on this topic is "Notes on Distributed Databases" by Bruce Lindsay et al . 5 It lays out the fundamental principles for database replication and discusses a number of techniques that deal with achieving consistency. Many of these techniques try to achieve distribution transparency—that is, to the user of the system it appears as if there is only one system instead of a number of collaborating systems. Many systems during this time took the approach that it was better to fail the complete system than to break this transparency.2
In the mid-‘90s, with the rise of larger Internet systems, these practices were revisited. At that time people began to consider the idea that availability was perhaps the most important property of these systems, but they were struggling with what it should be traded off against. Eric Brewer , systems professor at the University of California, Berkeley, and at that time head of Inktomi, brought the different trade-offs together in a keynote address to the PODC (Principles of Distributed Computing) conference in 2000.1 He presented the CAP theorem, which states that of three properties of shared-data systems—data consistency, system availability, and tolerance to network partition—only two can be achieved at any given time. A more formal confirmation can be found in a 2002 paper by Seth Gilbert and Nancy Lynch .4
A system that is not tolerant to network partitions can achieve data consistency and availability, and often does so by using transaction protocols. To make this work, client and storage systems must be part of the same environment; they fail as a whole under certain scenarios, and as such, clients cannot observe partitions. An important observation is that in larger distributed-scale systems, network partitions are a given; therefore, consistency and availability cannot be achieved at the same time. This means that there are two choices on what to drop: relaxing consistency will allow the system to remain highly available under the partitionable conditions, whereas making consistency a priority means that under certain conditions the system will not be available.
Both options require the client developer to be aware of what the system is offering. If the system emphasizes consistency, the developer has to deal with the fact that the system may not be available to take, for example, a write. If this write fails because of system unavailability, then the developer will have to deal with what to do with the data to be written. If the system emphasizes availability, it may always accept the write, but under certain conditions a read will not reflect the result of a recently completed write. The developer then has to decide whether the client requires access to the absolute latest update all the time. There is a range of applications that can handle slightly stale data, and they are served well under this model.
In principle the consistency property of transaction systems as defined in the ACID properties (atomicity, consistency, isolation, durability) is a different kind of consistency guarantee. In ACID, consistency relates to the guarantee that when a transaction is finished the database is in a consistent state; for example, when transferring money from one account to another the total amount held in both accounts should not change. In ACID-based systems, this kind of consistency is often the responsibility of the developer writing the transaction but can be assisted by the database managing integrity constraints.
Consistency—Client and Server
There are two ways of looking at consistency. One is from the developer/client point of view: how they observe data updates. The second way is from the server side: how updates flow through the system and what guarantees systems can give with respect to updates.
Client-side Consistency
The client side has these components:
- A storage system. For the moment we‘ll treat it as a black box, but one should assume that under the covers it is something of large scale and highly distributed, and that it is built to guarantee durability and availability.
- Process A. This is a process that writes to and reads from the storage system.
- Processes B and C. These two processes are independent of process A and write to and read from the storage system. It is irrelevant whether these are really processes or threads within the same process; what is important is that they are independent and need to communicate to share information.
Client-side consistency has to do with how and when observers (in this case the processes A, B, or C) see updates made to a data object in the storage systems. In the following examples illustrating the different types of consistency, process A has made an update to a data object: - Strong consistency. After the update completes, any subsequent access (by A, B, or C) will return the updated value.
- Weak consistency. The system does not guarantee that subsequent accesses will return the updated value. A number of conditions need to be met before the value will be returned. The period between the update and the moment when it is guaranteed that any observer will always see the updated value is dubbed the inconsistency window .
- Eventual consistency. This is a specific form of weak consistency; the storage system guarantees that if no new updates are made to the object, eventually all accesses will return the last updated value. If no failures occur, the maximum size of the inconsistency window can be determined based on factors such as communication delays, the load on the system, and the number of replicas involved in the replication scheme. The most popular system that implements eventual consistency is DNS (Domain Name System). Updates to a name are distributed according to a configured pattern and in combination with time-controlled caches; eventually, all clients will see the update.
The eventual consistency model has a number of variations that are important to consider:
- Causal consistency. If process A has communicated to process B that it has updated a data item, a subsequent access by process B will return the updated value, and a write is guaranteed to supersede the earlier write. Access by process C that has no causal relationship to process A is subject to the normal eventual consistency rules.
- Read-your-writes consistency. This is an important model where process A, after it has updated a data item, always accesses the updated value and will never see an older value. This is a special case of the causal consistency model.
- Session consistency. This is a practical version of the previous model, where a process accesses the storage system in the context of a session. As long as the session exists, the system guarantees read-your-writes consistency. If the session terminates because of a certain failure scenario, a new session needs to be created and the guarantees do not overlap the sessions.
- Monotonic read consistency. If a process has seen a particular value for the object, any subsequent accesses will never return any previous values.
- Monotonic write consistency. In this case the system guarantees to serialize the writes by the same process. Systems that do not guarantee this level of consistency are notoriously hard to program.
A number of these properties can be combined. For example, one can get monotonic reads combined with session-level consistency. From a practical point of view these two properties (monotonic reads and read-your-writes) are most desirable in an eventual consistency system, but not always required. These two properties make it simpler for developers to build applications, while allowing the storage system to relax consistency and provide high availability.
As you can see from these variations, quite a few different scenarios are possible. It depends on the particular applications whether or not one can deal with the consequences.
Eventual consistency is not some esoteric property of extreme distributed systems. Many modern RDBMSs (relational database management systems) that provide primary-backup reliability implement their replication techniques in both synchronous and asynchronous modes. In synchronous mode the replica update is part of the transaction. In asynchronous mode the updates arrive at the backup in a delayed manner, often through log shipping. In the latter mode if the primary fails before the logs are shipped, reading from the promoted backup will produce old, inconsistent values. Also to support better scalable read performance, RDBMSs have started to provide the ability to read from the backup, which is a classical case of providing eventual consistency guarantees in which the inconsistency windows depend on the periodicity of the log shipping.
Server-side ConsistencyOn the server side we need to take a deeper look at how updates flow through the system to understand what drives the different modes that the developer who uses the system can experience. Let‘s establish a few definitions before getting started:
N = the number of nodes that store replicas of the data
W = the number of replicas that need to acknowledge the receipt of the update before the update completes
R = the number of replicas that are contacted when a data object is accessed through a read operation
If W+R > N, then the write set and the read set always overlap and one can guarantee strong consistency. In the primary-backup RDBMS scenario, which implements synchronous replication, N=2, W=2, and R=1. No matter from which replica the client reads, it will always get a consistent answer. In asynchronous replication with reading from the backup enabled, N=2, W=1, and R=1. In this case R+W=N, and consistency cannot be guaranteed.
The problems with these configurations, which are basic quorum protocols, is that when the system cannot write to W nodes because of failures, the write operation has to fail, marking the unavailability of the system. With N=3 and W=3 and only two nodes available, the system will have to fail the write.
In distributed-storage systems that need to provide high performance and high availability, the number of replicas is in general higher than two. Systems that focus solely on fault tolerance often use N=3 (with W=2 and R=2 configurations). Systems that need to serve very high read loads often replicate their data beyond what is required for fault tolerance; N can be tens or even hundreds of nodes, with R configured to 1 such that a single read will return a result. Systems that are concerned with consistency are set to W=N for updates, which may decrease the probability of the write succeeding. A common configuration for these systems that are concerned about fault tolerance but not consistency is to run with W=1 to get minimal durability of the update and then rely on a lazy (epidemic) technique to update the other replicas.
How to configure N, W, and R depends on what the common case is and which performance path needs to be optimized. In R=1 and N=W we optimize for the read case, and in W=1 and R=N we optimize for a very fast write. Of course in the latter case, durability is not guaranteed in the presence of failures, and if W < (N+1)/2, there is the possibility of conflicting writes when the write sets do not overlap.
Weak/eventual consistency arises when W+R <= N, meaning that there is a possibility that the read and write set will not overlap. If this is a deliberate configuration and not based on a failure case, then it hardly makes sense to set R to anything but 1. This happens in two very common cases: the first is the massive replication for read scaling mentioned earlier; the second is where data access is more complicated. In a simple key-value model it is easy to compare versions to determine the latest value written to the system, but in systems that return sets of objects it is more difficult to determine what the correct latest set should be. In most of these systems where the write set is smaller than the replica set, a mechanism is in place that applies the updates in a lazy manner to the remaining nodes in the replica‘s set. The period until all replicas have been updated is the inconsistency window discussed before. If W+R <= N, then the system is vulnerable to reading from nodes that have not yet received the updates.
Whether or not read-your-writes, session, and monotonic consistency can be achieved depends in general on the "stickiness" of clients to the server that executes the distributed protocol for them. If this is the same server every time, then it is relatively easy to guarantee read-your-writes and monotonic reads. This makes it slightly harder to manage load balancing and fault tolerance, but it is a simple solution. Using sessions, which are sticky, makes this explicit and provides an exposure level that clients can reason about.
Sometimes the client implements read-your-writes and monotonic reads. By adding versions on writes, the client discards reads of values with versions that precede the last-seen version.
Partitions happen when some nodes in the system cannot reach other nodes, but both sets are reachable by groups of clients. If you use a classical majority quorum approach, then the partition that has W nodes of the replica set can continue to take updates while the other partition becomes unavailable. The same is true for the read set. Given that these two sets overlap, by definition the minority set becomes unavailable. Partitions don‘t happen frequently, but they do occur between data centers, as well as inside data centers.
In some applications the unavailability of any of the partitions is unacceptable, and it is important that the clients that can reach that partition make progress. In that case both sides assign a new set of storage nodes to receive the data, and a merge operation is executed when the partition heals. For example, within Amazon the shopping cart uses such a write-always system; in the case of partition, a customer can continue to put items in the cart even if the original cart lives on the other partitions. The cart application assists the storage system with merging the carts once the partition has healed.
Amazon‘s DynamoA system that has brought all of these properties under explicit control of the application architecture is Amazon‘s Dynamo , a key-value storage system that is used internally in many services that make up the Amazon e-commerce platform, as well as Amazon‘s Web Services. One of the design goals of Dynamo is to allow the application service owner who creates an instance of the Dynamo storage system—which commonly spans multiple data centers—to make the trade-offs between consistency, durability, availability, and performance at a certain cost point.3
SummaryData inconsistency in large-scale reliable distributed systems has to be tolerated for two reasons: improving read and write performance under highly concurrent conditions; and handling partition cases where a majority model would render part of the system unavailable even though the nodes are up and running.
Whether or not inconsistencies are acceptable depends on the client application. In all cases the developer needs to be aware that consistency guarantees are provided by the storage systems and need to be taken into account when developing applications. There are a number of practical improvements to the eventual consistency model, such as session-level consistency and monotonic reads, which provide better tools for the developer. Many times the application is capable of handling the eventual consistency guarantees of the storage system without any problem. A specific popular case is a Web site in which we can have the notion of user-perceived consistency. In this scenario the inconsistency window needs to be smaller than the time expected for the customer to return for the next page load. This allows for updates to propagate through the system before the next read is expected.
The goal of this article is to raise awareness about the complexity of engineering systems that need to operate at a global scale and that require careful tuning to ensure that they can deliver the durability, availability, and performance that their applications require. One of the tools the system designer has is the length of the consistency window, during which the clients of the systems are possibly exposed to the realities of large-scale systems engineering.
References- Brewer, E. A. 2000. Towards robust distributed systems (abstract) . In Proceedings of the 19th Annual ACM Symposium on Principles of Distributed Computing (July 16-19, Portland, Oregon): 7
- A Conversation with Bruce Lindsay. 2004. ACM Queue 2(8): 22-33.
- DeCandia, G., Hastorun, D., Jampani, M., Kakulapati, G., Lakshman, A., Pilchin, A., Sivasubramanian, S., Vosshall, P., Vogels, W. 2007. Dynamo: Amazon‘s highly available key-value store . In Proceedings of the 21st ACM Symposium on Operating Systems Principles (Stevenson, Washington, October).
- Gilbert , S., Lynch, N. 2002. Brewer‘s conjecture and the feasibility of consistent, available, partition-tolerant Web services . ACM SIGACT News 33(2).
- Lindsay, B. G., Selinger, P. G., et al. 1980. Notes on distributed databases. In Distributed Data Bases, ed. I . W. Draffan and F. Poole, 247-284. Cambridge: Cambridge University Press. Also available as IBM Research Report RJ2517, San Jose, California (July 1979).