Some things on how ZFS dnode object IDs are allocated (which is not sequentially)
One of the core elements of ZFS are dnodes, which define DMU objects. Within a single filesystem or other object sets, dnodes have an object number (aka object id). For dnodes that are files or directories in a filesystem, this is visible as their Unix inode number, but other internal things get dnodes and thus object numbers (for example, the dnode of the filesystem's delete queue). Object ids are 64-bit numbers, and many of them can be relatively small (especially if they are object ids for internal structures, again such as the delete queue). Very large dnode numbers are uncommon, and some files and directories from early in a filesystem's life can have very small object IDs.
(For instance, the object ID of my home directory on our ZFS fileservers is '5'. I'm the only user in this filesystem.)
You might reasonably wonder how ZFS object IDs are allocated. Inspection of a ZFS filesystem will show that they are clearly not allocated sequentially, but they're also not allocated randomly. Based on an inspection of the dnode allocation source code in dmu_object.c, there seem to be two things going on to spread dnode object ids around some (but not too much).
The first thing is that dnode allocation is done from per-CPU chunks of the dnode space. The size of each chunk is set by dmu_object_alloc_chunk_shift, which by default creates 128-dnode chunks. The motivation for this is straightforward; if all of the CPUs in the system were all allocating dnodes from the same area, they would all have to content over locks on this area. Spreading out into separate chunks reduces locking contention, which means that parallel or highly parallel workloads that frequently create files on a single filesystem don't bottleneck on a shared lock.
(One reason that you might create files a lot in a parallel worklog is if you're using files on the filesystem as part of a locking strategy. This is still common in things like mail servers, mail clients, and IMAP servers.)
The second thing is, well, I'm going to quote the comment in the source code to start with:
Each time we polish off a L1 bp worth of dnodes (2^12 objects), move to another L1 bp that's still reasonably sparse (at most 1/4 full). Look from the beginning at most once per txg. If we still can't allocate from that L1 block, search for an empty L0 block, which will quickly skip to the end of the metadnode if no nearby L0 blocks are empty. This fallback avoids a pathology where full dnode blocks containing large dnodes appear sparse because they have a low blk_fill, leading to many failed allocation attempts. [...]
(In reading the code a bit, I think this comment means 'L2 block' instead of 'L0 block'.)
To understand a bit more about this, we need to know about two things. First, we need to know that dnodes themselves are stored in another DMU object, and this DMU object stores data in the same way as all others do, using various levels of indirect blocks. Then we need to know about indirect blocks themselves. L0 blocks directly hold data (in this case the actual dnodes), while L1 blocks hold pointers to L0 blocks and L2 blocks hold pointers to L1 blocks.
(You can see examples of this structure for regular files in the
zdb output in this entry and this
entry. If I'm doing the math right,
for dnodes a L0 block normally holds 32 dnodes and a L<N> block
can address up to 128 L<N-1> blocks, through block pointers.)
So, what appears to happen is that at first, the per-CPU allocator gets its chunks sequentially (for different CPUs, or the same CPU) from the same L1 indirect block, which covers 4096 dnodes. When we exhaust all of the 128-dnode chunks in a single group of 4096, we don't move to the sequentially next group of 4096; instead we search around for a sufficiently empty group, and switch to it (where a 'sufficiently empty' group is one with at most 1024 dnodes already allocated). If there is no such group, I think that we may wind up skipping to the end of the currently allocated dnodes and getting a completely fresh empty block of 4096.
If I'm right, the net effect of this is to smear out dnode allocations and especially reallocations over an increasingly large portion of the lower dnode object number space. As your filesystem gets used and files get deleted, many of the lower 4096-dnode groups will have some or even many free dnodes, but not the 3072 that they need to be eligible for be selected for further assignment. This can eventually push dnode allocations to relatively high object numbers even though you may not have anywhere near that many dnodes in use on the filesystem. This is not guaranteed, though, and you may still reuse dnode numbers.
(For example, I just created a new file in my home directory. My home directory's filesystem has 1983310 dnodes used right now, but the inode number (and thus dnode object number) that my new test file got was 1804696.)