This page explains how reads and writes are affected by the replicated and distributed nature of data in CockroachDB. It starts by summarizing some important CockroachDB architectural concepts and then walks you through a few simple read and write scenarios.
For a more detailed trace of a query through the layers of CockroachDB's architecture, see Life of a Distributed Transaction.
|Your CockroachDB deployment, which acts as a single logical application.
|An individual machine running CockroachDB. Many nodes join together to create your cluster.
| CockroachDB stores all user data (tables, indexes, etc.) and almost all system data in a giant sorted map of key-value pairs. This keyspace is divided into "ranges", contiguous chunks of the keyspace, so that every key can always be found in a single range.
From a SQL perspective, a table and its secondary indexes initially map to a single range, where each key-value pair in the range represents a single row in the table (also called the primary index because the table is sorted by the primary key) or a single row in a secondary index. As soon as that range reaches 64 MiB in size, it splits into two ranges. This process continues for these new ranges as the table and its indexes continue growing.
|CockroachDB replicates each range (3 times by default) and stores each replica on a different node.
|For each range, one of the replicas holds the "range lease". This replica, referred to as the "leaseholder", is the one that receives and coordinates all read and write requests for the range.
Unlike writes, read requests access the leaseholder and send the results to the client without needing to coordinate with any of the other range replicas. This reduces the network round trips involved and is possible because the leaseholder is guaranteed to be up-to-date due to the fact that all write requests also go to the leaseholder.
|For each range, one of the replicas is the "leader" for write requests. Via the Raft consensus protocol, this replica ensures that a majority of replicas (the leader and enough followers) agree, based on their Raft logs, before committing the write. The Raft leader is almost always the same replica as the leaseholder.
|For each range, a time-ordered log of writes to the range that its replicas have agreed on. This log exists on-disk with each replica and is the range's source of truth for consistent replication.
As mentioned above, when a query is executed, the cluster routes the request to the leaseholder for the range containing the relevant data. If the query touches multiple ranges, the request goes to multiple leaseholders. For a read request, only the leaseholder of the relevant range retrieves the data. For a write request, the Raft consensus protocol dictates that a majority of the replicas of the relevant range must agree before the write is committed.
Let's consider how these mechanics play out in some hypothetical queries.
First, imagine a simple read scenario where:
- There are 3 nodes in the cluster.
- There are 3 small tables, each fitting in a single range.
- Ranges are replicated 3 times (the default).
- A query is executed against node 2 to read from table 3.
In this case:
- Node 2 (the gateway node) receives the request to read from table 3.
- The leaseholder for table 3 is on node 3, so the request is routed there.
- Node 3 returns the data to node 2.
- Node 2 responds to the client.
If the query is received by the node that has the leaseholder for the relevant range, there are fewer network hops:
Now imagine a simple write scenario where a query is executed against node 3 to write to table 1:
In this case:
- Node 3 (the gateway node) receives the request to write to table 1.
- The leaseholder for table 1 is on node 1, so the request is routed there.
- The leaseholder is the same replica as the Raft leader (as is typical), so it simultaneously appends the write to its own Raft log and notifies its follower replicas on nodes 2 and 3.
- As soon as one follower has appended the write to its Raft log (and thus a majority of replicas agree based on identical Raft logs), it notifies the leader and the write is committed to the key-values on the agreeing replicas. In this diagram, the follower on node 2 acknowledged the write, but it could just as well have been the follower on node 3. Also note that the follower not involved in the consensus agreement usually commits the write very soon after the others.
- Node 1 returns acknowledgement of the commit to node 3.
- Node 3 responds to the client.
Just as in the read scenario, if the write request is received by the node that has the leaseholder and Raft leader for the relevant range, there are fewer network hops:
Network and I/O bottlenecks
With the above examples in mind, it's always important to consider network latency and disk I/O as potential performance bottlenecks. In summary:
- For reads, hops between the gateway node and the leaseholder add latency.
- For writes, hops between the gateway node and the leaseholder/Raft leader, and hops between the leaseholder/Raft leader and Raft followers, add latency. In addition, since Raft log entries are persisted to disk before a write is committed, disk I/O is important.