This section explains the process which controls how the view change identifier is incorporated into a binary log event and written to the log, The following steps are taken:
All servers are online and processing incoming transactions from the group. Some servers may be a little behind in terms of transactions replicated, but eventually they converge. The group acts as one distributed and replicated database.
Whenever a new member joins the group and therefore a view change is performed, every online server queues a view change log event for execution. This is queued because before the view change, several transactions can be queued on the server to be applied and as such, these belong to the old view. Queuing the view change event after them guarantees a correct marking of when this happened.
Meanwhile, the joining server selects the donor from the list of online servers as stated by the membership service through the view abstraction. A member joins on view 4 and the online members write a View change event to the binary log.
Once the joining server has chosen which server in the group is to be the donor, a new asynchronous replication connection is established between the two and the state transfer begins (phase 1). This interaction with the donor continues until the joining server's applier thread processes the view change log event that corresponds to the view change triggered when the joining server came into the group. In other words, the joining server replicates from the donor, until it gets to the marker with the view identifier which matches the view marker it is already in.
As view identifiers are transmitted to all members in the group at the same logical time, the joining server knows at which view identifier it should stop replicating. This avoids complex GTID set calculations because the view id clearly marks which data belongs to each group view.
While the joining server is replicating from the donor, it is also caching incoming transactions from the group. Eventually, it stops replicating from the donor and switches to applying those that are cached.
When the joining server recognizes a view change log event with the expected view identifier, the connection to the donor is terminated and it starts applying the cached transactions. An important point to understand is the final recovery procedure. Although it acts as a marker in the binary log, delimiting view changes, the view change log event also plays another role. It conveys the certification information as perceived by all servers when the joining server entered the group, in other words the last view change. Without it, the joining server would not have the necessary information to be able to certify (detect conflicts) subsequent transactions.
The duration of the catch up (phase 2) is not deterministic, because it depends on the workload and the rate of incoming transactions to the group. This process is completely online and the joining server does not block any other server in the group while it is catching up. Therefore the number of transactions the joining server is behind when it moves to phase 2 can, for this reason, vary and thus increase or decrease according to the workload.
When the joining server's queued transactions reach zero and its stored data is equal to the other members, its public state changes to online.