[Tahoe-dev] dirnode design document
warner-tahoe at allmydata.com
Tue Jul 3 00:37:06 UTC 2007
I've just pushed a document into the source tree (doc/dirnodes.txt) that
attempts to explain the approach we took to managing directories and the
whole "vdrive" layer. We implemented this last week and it's all available in
the 0.4.0 release.
The approach we took values ease of delegation and clarity of implementation
over distribution/reliability. Each directory lives on a single (central)
server, and is thus vulnerable to that server being unavailable or broken.
We've got a few plans to improve that, some of which are described in this
Please read it over and share any thoughts that come to mind. I'll put a copy
of this on the wiki too, feel free to start a discussion about it.
= Tahoe Directory Nodes =
As explained in the architecture docs, Tahoe can be roughly viewed as a
collection of three layers. The lowest layer is the distributed filestore, or
DHT: it provides operations that accept files and upload them to the mesh,
creating a URI in the process which securely references the file's contents.
The middle layer is the filesystem, creating a structure of directories and
filenames resembling the traditional unix/windows filesystems. The top layer
is the application layer, which uses the lower layers to provide useful
services to users, like a backup application, or a way to share files with
This document examines the middle layer, the "filesystem".
== DHT Primitives ==
In the lowest layer (DHT), we've defined two operations thus far, both of
which refer to "CHK URIs", which reference immutable data:
chk_uri = put(data)
data = get(chk_uri)
We anticipate creating mutable slots in the DHT layer at some point, which
will add some new operations to this layer:
slotname = create_slot()
data = get(slotname)
== Filesystem Goals ==
The main goal for the middle (filesystem) layer is to give users a way to
organize the data that they have uploaded into the mesh. The traditional way
to do this in computer filesystems is to put this data into files, give those
files names, and collect these names into directories.
Each directory is a series of name-value pairs, which maps "child name" to an
object of some kind. Those child objects might be files, or they might be
The directory structure is therefore a directed graph of nodes, in which each
node might be a directory node or a file node. All file nodes are terminal
== Dirnode Goals ==
What properties might be desireable for these directory nodes? In no
1: functional. Code which does not work doesn't count.
2: easy to document, explain, and understand
3: private: it should not be possible for others to see the contents of a
4: integrity: it should not be possible for others to modify the contents
of a directory
5: available: directories should survive host failure, just like files do
6: efficient: in storage, communication bandwidth, number of round-trips
7: easy to delegate individual directories in a flexible way
8: updateness: everybody looking at a directory should see the same contents
9: monotonicity: everybody looking at a directory should see the same
sequence of updates
We do not meet all of these goals. For the current release, we favored #1,
#2, and #7 above the rest, which lead us to the following design. In a later
#section, we discuss some alternate designs and potential changes to the
#existing code that can help us achieve the other goals.
In tahoe-0.4.0, each "dirnode" is stored as a file on a single "vdrive
server". The name of this file is an unguessable string. The contents are an
encrypted representation of the directory's name-to-child mapping. Foolscap
is used to provide remote access to this file. A collection of "directory
URIs" are used to hold all the parameters necessary to access, read, and
write this dirnode.
== Dirnode secret values ==
Each dirnode begins life as a "writekey", a randomly-generated AES key. This
key is hashed (using a tagged hash, see src/allmydata/util/hashutil.py for
details) to form the "readkey". The readkey is hashed to form the "storage
index". The writekey is hashed with a different tag to form the "write
Clients who have read-write access to the dirnode know the writekey, and can
derive all the other secrets from it. Clients with merely read-only access to
the dirnode know the readkey (and can derive the storage index), but do not
know the writekey or the write enabler. The vdrive server knows only the
storage index and the write enabler.
== Dirnode capability URIs ==
The "write capability" for a dirnode grants read-write access to its
contents. This is expressed on concrete form as the "dirnode write URI": a
printable string which contains the following pieces of information:
furl of the vdrive server hosting this dirnode
The "read capability" grants read-only access to a dirnode, and its "dirnode
read URI" contains:
furl of the vdrive server hosting this dirnode
is a write-capability URI, while
is a read-capability URI, both for the same dirnode.
== Dirnode storage format ==
Each dirnode is stored in a single file, saved on the vdrive server, using
the (base32-encoded) storage index as a filename. The contents of this file
are a serialized dictionary which maps H_name (explained below) to a tuple
with three values: (E_name, E_write, E_read). The vdrive server is made
available as a Foolscap "Referenceable" object, with the following
create_dirnode(index, write_enabler) -> None
list(index) -> list of (E_name, E_write, E_read) tuples
get(index, H_name) -> (E_write, E_read)
set(index, write_enabler, H_name, E_name, E_write, E_read)
delete(index, write_enabler, H_name)
For any given entry of this dictionary, the following values are obtained by
hashing or encryption:
H_name is the hash of the readkey and the child's name.
E_name is the child's name, encrypted with the readkey
E_write is the child's write-URI, encrypted with the writekey
E_read is the child's read-URI, encrypted with the readkey
All encryption uses AES in CTR mode, in which the high-order 10 or 12 bytes
of the 16-byte key are used as an IV (randomly chosen each time the data is
changed), and the remaining bytes are used as the CTR-mode offset. An
HMAC-SHA256 is computed for each encrypted value and stored alongside. The
stored E_name/E_write/E_read values are thus the concatenation of IV,
encrypted data, and HMAC.
When a new dirnode is created, it records the write_enabler. All operations
that modify an existing dirnode (set and delete) require the write_enabler be
This approach insures that clients who do not have the read or write keys
(including the vdrive server, which knows the storage index but not the keys)
will be unable to see any of the contents of the dirnode. Clients who have
the readkey but not the writekey will not be allowed to modify the dirnode.
The H_name value allows clients to perform lookups of specific keys rather
than requiring them to download the whole dirnode for each operation.
By putting both read-only and read-write child access capabilities in each
entry, encrypted by different keys, this approach provides transitive
read-only-ness: if a client has only a readkey for the parent dirnode, they
will only get readkeys (and not writekeys) for any children, including other
directories. When we create mutable slots in the mesh and we start having
read-write file URIs, we can use the same approach to insure that read-only
access to a directory means read-only access to the files as well.
== Design Goals, redux ==
How well does this design meet the goals?
#1 functional: YES: the code works and has extensive unit tests
#2 documentable: YES: this document is the existence proof
#3 private: MOSTLY: see the discussion below
#4 integrity: MOSTLY: the vdrive server can rollback individual slots
#5 availability: BARELY: if the vdrive server is offline, the dirnode will
be unuseable. If the vdrive server fails,
the dirnode will be lost forever.
#6 efficient: MOSTLY:
network: single dirnode lookup is very efficient, since clients can
fetch specific keys rather than being required to get or set
the entire dirnode each time. Traversing many directories
takes a lot of roundtrips, and these can't be collapsed with
promise-pipelining because the intermediate values must only
be visible to the client. Modifying many dirnodes at once
(e.g. importing a large pre-existing directory tree) is pretty
slow, since each graph edge must be created independently.
storage: each child has a separate IV, which makes them larger than
if all children were aggregated into a single encrypted string
#7 delegation: VERY: each dirnode is a completely independent object,
to which clients can be granted separate read-write or
#8 updateness: VERY: with only a single point of access, and no caching,
each client operation starts by fetching the current
value, so there are no opportunities for staleness
#9 monotonicity: VERY: the single point of access also protects against
=== Privacy leaks in the vdrive server ===
Dirnodes are very private against other clients: traffic between the client
and the vdrive server is protected by the Foolscap SSL connection, so they
can observe very little. Storage index values are hashes of secrets and thus
unguessable, and they are not made public, so other clients cannot snoop
through encrypted dirnodes that they have not been told about.
On the other hand, the vdrive server gets to see the access patterns of each
client who is using dirnodes hosted there. The childnames and URIs are
encrypted and not visible to anyone (including the vdrive server), but the
vdrive server is in a good position to infer a lot of data about the
directory structure. It knows the length of all childnames, and from the
length of the child URIs themselves it can tell whether children are file
URIs vs. directory URIs vs read-only directory URIs. By watching a client's
access patterns it can deduce the connection between (encrypted) child 1 and
target directory 2 (i.e. if the client does a 'get' of the first child, then
immediately does an operation on directory 2, it can assume the two are
related. From this the vdrive server can build a graph with the same shape as
the filesystem, even though the nodes and edges will be unlabled.
By providing CHK-level storage services as well (or colluding with a server
who is), the vdrive server can infer the storage index of file nodes that are
downloaded shortly after their childname is looked up.
=== Integrity failures in the vdrive server ===
The HMAC prevents the vdrive server from modifying the child names or child
URI values without detection: changing a few bytes will cause an HMAC failure
that the client can detect. This means the vdrive server can make the dirnode
unavailable, but not corrupt it.
However, the vdrive server can perform a rollback attack: either replacing an
individual entry in the encrypted table with an old version, or replacing the
entire table. Despite not knowing what the child names or URIs are, the
vdrive server can undo changes made by authorized clients. It could also
perform selective rollback, showing different clients different versions of
the filesystem. To solve this problem either requires mutable data (like a
sequence number or hash) to be stored in the URI which points to this dirnode
(rendering them non-constant, and losing most of their value), or requires
spreading the dirnode out over multiple non-colluding servers (which might
improve availability but makes updateness and monotonicity harder).
=== Improving the availability of dirnodes ===
Clearly it is somewhat disappointing to have a sexy distributed filestore at
the bottom layer and then have a single-point-of-failure vdrive server on top
of it. However, this approach meets many of the design goals and is extremely
simple to explain and implement. There are many avenues to improve the
reliability and availability of dirnodes. (note that reliability and
availability can be separate goals).
A simple way to improve the reliability of dirnodes would be to make the
vdrive server be responsible for saving the dirnode contents in a fashion
that will survive the failure of its local disk, for example by simply
rsync'ing all the dirnodes off to a separate machine on a periodic basis, and
pulling them back in the case of disk failure.
To improve availability, we must allow clients to access their dirnodes even
if the vdrive server is offline. The first step here is to create multiple
vdrive servers, putting a list of furls into the DIR:URI, with instructions
to update all of them during write, and accept the first answer that comes
back during read. This introduces issues of updateness and monotonicity: if a
dirnode is changed while one of the vdrive servers is offline, the servers
will diverge, and subsequent clients will see different contents depending
upon which server they ask.
A more comforting way to improve both reliability and availability is to
spread the dirnodes out over the mesh in the same way that CHK files work.
The general name for this approach is the "SSK directory slot", a structure
for keeping a mutable slot on multiple hosts, setting and retrieving its
contents at various times, and reconciling differences by comparing sequence
numbers. The "slot name" is the hash of a public key, which is also used to
sign updates, such that the SSK storage hosts will only accept updates from
those in possession of the corresponding private key. This approach (although
not yet implemented) will provide fairly good reliability and availability
properties, at the expense of complexity and updateness/monotonicity. It can
also improve integrity, since an attacker would have to corrupt multiple
storage servers to successfully perform a rollback attack.
Reducing centralization can improve reliability, as long as the overall
reliability of the mesh is greater than the reliability of the original
=== Improving the efficiency of dirnodes ===
By storing each child of a dirnode in a separate element of the dictionary,
we provide efficient directory traversal and clean+simple dirnode delegation
behavior. This comes at the cost of efficiency for other operations,
specifically things that operation on multiple dirnodes at once.
When a backup program is run for the first time, it needs to copy a large
amount of data from a pre-existing filesystem into reliable storage. This
means that a large and complex directory structure needs to be duplicated in
the dirnode layer. With the one-object-per-dirnode approach described here,
this requires as many operations as there are edges in the imported
Another approach would be to aggregate multiple directories into a single
storage object. This object would contain a serialized graph rather than a
single name-to-child dictionary. Most directory operations would fetch the
whole block of data (and presumeably cache it for a while to avoid lots of
re-fetches), and modification operations would need to replace the whole
thing at once. This "realm" approach would have the added benefit of
combining more data into a single encrypted bundle (perhaps hiding the shape
of the graph from the vdrive server better), and would reduce round-trips
when performing deep directory traversals (assuming the realm was already
cached). It would also prevent fine-grained rollback attacks from working:
the vdrive server could change the entire dirnode to look like an earlier
state, but it could not independently roll back individual edges.
The drawbacks of this aggregation would be that small accesses (adding a
single child, looking up a single child) would require pulling or pushing a
lot of unrelated data, increasing network overhead (and necessitating
test-and-set semantics for the modification side, which increases the chances
that a user operation will fail, making it more challenging to provide
promises of atomicity to the user).
It would also make it much more difficult to enable the delegation
("sharing") of specific directories. Since each aggregate "realm" provides
all-or-nothing access control, the act of delegating any directory from the
middle of the realm would require the realm first be split into the upper
piece that isn't being shared and the lower piece that is. This splitting
would have to be done in response to what is essentially a read operation,
which is not traditionally supposed to be a high-effort action.
=== Dirnode expiration and leases ===
Dirnodes are created any time a client wishes to add a new directory. How
long do they live? What's to keep them from sticking around forever, taking
up space that nobody can reach any longer?
Our plan is to define the vdrive servers to keep dirnodes alive with
"leases". Clients which know and care about specific dirnodes can ask to keep
them alive for a while, by renewing a lease on them (with a typical period of
one month). Clients are expected to assist in the deletion of dirnodes by
canceling their leases as soon as they are done with them. This means that
when a client deletes a directory, it should also cancel its lease on that
directory. When the lease count on a dirnode goes to zero, the vdrive server
can delete the related storage. Multiple clients may all have leases on the
same dirnode: the server may delete the dirnode only after all of the leases
have gone away.
We expect that clients will periodically create a "manifest": a list of
so-called "refresh capabilities" for all of the dirnodes and files that they
can reach. They will give this manifest to the "repairer", which is a service
that keeps files (and dirnodes) alive on behalf of clients who cannot take on
this responsibility for themselves. These refresh capabilities include the
storage index, but do *not* include the readkeys or writekeys, so the
repairer does not get to read the files or directories that it is helping to
After each change to the user's vdrive, the client creates a manifest and
looks for differences from their previous version. Anything which was removed
prompts the client to send out lease-cancellation messages, allowing the data
to be deleted.
== Starting Points: root dirnodes ==
Any client can record the URI of a directory node in some external form (say,
in a local file) and use it as the starting point of later traversal. The
current vdrive servers are configured to create a "root" dirnode at startup
and publish its URI to the world: this forms the basis of the "global shared
vdrive" used in the demonstration application. In addition, client code is
currently designed to create a new (unattached) dirnode at startup and record
its URI: this forms the root of the "per-user private vdrive" presented as
the "~" directory.
== Mounting and Sharing Directories ==
The biggest benefit of this dirnode approach is that sharing individual
directories is almost trivial. Alice creates a subdirectory that she wants to
use to share files with Bob. This subdirectory is attached to Alice's
filesystem at "~alice/share-with-bob". She asks her filesystem for the
read-write directory URI for that new directory, and emails it to Bob. When
Bob receives the URI, he asks his own local vdrive to attach the given URI,
perhaps at a place named "~bob/shared-with-alice". Every time either party
writes a file into this directory, the other will be able to read it. If
Alice prefers, she can give a read-only URI to Bob instead, and then Bob will
be able to read files but not change the contents of the directory. Neither
Alice nor Bob will get access to any files above the mounted directory: there
are no 'parent directory' pointers. If Alice creates a nested set of
directories, "~alice/share-with-bob/subdir2", and gives a read-only URI to
share-with-bob to Bob, then Bob will be unable to write to either
share-with-bob/ or subdir2/.
A suitable UI needs to be created to allow users to easily perform this
sharing action: dragging a folder their vdrive to an IM or email user icon,
for example. The UI will need to give the sending user an opportunity to
indicate whether they want to grant read-write or read-only access to the
recipient. The recipient then needs an interface to drag the new folder into
their vdrive and give it a home.
== Revocation ==
When Alice decides that she no longer wants Bob to be able to access the
shared directory, what should she do? Suppose she's shared this folder with
both Bob and Carol, and now she wants Carol to retain access to it but Bob to
be shut out. Ideally Carol should not have to do anything: her access should
The current plan is to have her client create a deep copy of the folder in
question, delegate access to the new folder to the remaining members of the
group (Carol), asking the lucky survivors to replace their old reference with
the new one. Bob may still have access to the old folder, but he is now the
only one who cares: everyone else has moved on, and he will no longer be able
to see their new changes. In a strict sense, this is the strongest form of
revocation that can be accomplished: there is no point trying to force Bob to
forget about the files that he read a moment before being kicked out. In
addition it must be noted that anyone who can access the directory can proxy
for Bob, reading files to him and accepting changes whenever he wants.
Preventing delegation between communication parties is just as pointless as
asking Bob to forget previously accessed files. However, there may be value
to configuring the UI to ask Carol to not share files with Bob, or to
removing all files from Bob's view at the same time his access is revoked.
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