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1. Compression algorithm (deflate)\r
\r
The deflation algorithm used by gzip (also zip and zlib) is a variation of\r
LZ77 (Lempel-Ziv 1977, see reference below). It finds duplicated strings in\r
the input data.  The second occurrence of a string is replaced by a\r
pointer to the previous string, in the form of a pair (distance,\r
length).  Distances are limited to 32K bytes, and lengths are limited\r
to 258 bytes. When a string does not occur anywhere in the previous\r
32K bytes, it is emitted as a sequence of literal bytes.  (In this\r
description, `string' must be taken as an arbitrary sequence of bytes,\r
and is not restricted to printable characters.)\r
\r
Literals or match lengths are compressed with one Huffman tree, and\r
match distances are compressed with another tree. The trees are stored\r
in a compact form at the start of each block. The blocks can have any\r
size (except that the compressed data for one block must fit in\r
available memory). A block is terminated when deflate() determines that\r
it would be useful to start another block with fresh trees. (This is\r
somewhat similar to the behavior of LZW-based _compress_.)\r
\r
Duplicated strings are found using a hash table. All input strings of\r
length 3 are inserted in the hash table. A hash index is computed for\r
the next 3 bytes. If the hash chain for this index is not empty, all\r
strings in the chain are compared with the current input string, and\r
the longest match is selected.\r
\r
The hash chains are searched starting with the most recent strings, to\r
favor small distances and thus take advantage of the Huffman encoding.\r
The hash chains are singly linked. There are no deletions from the\r
hash chains, the algorithm simply discards matches that are too old.\r
\r
To avoid a worst-case situation, very long hash chains are arbitrarily\r
truncated at a certain length, determined by a runtime option (level\r
parameter of deflateInit). So deflate() does not always find the longest\r
possible match but generally finds a match which is long enough.\r
\r
deflate() also defers the selection of matches with a lazy evaluation\r
mechanism. After a match of length N has been found, deflate() searches for\r
a longer match at the next input byte. If a longer match is found, the\r
previous match is truncated to a length of one (thus producing a single\r
literal byte) and the process of lazy evaluation begins again. Otherwise,\r
the original match is kept, and the next match search is attempted only N\r
steps later.\r
\r
The lazy match evaluation is also subject to a runtime parameter. If\r
the current match is long enough, deflate() reduces the search for a longer\r
match, thus speeding up the whole process. If compression ratio is more\r
important than speed, deflate() attempts a complete second search even if\r
the first match is already long enough.\r
\r
The lazy match evaluation is not performed for the fastest compression\r
modes (level parameter 1 to 3). For these fast modes, new strings\r
are inserted in the hash table only when no match was found, or\r
when the match is not too long. This degrades the compression ratio\r
but saves time since there are both fewer insertions and fewer searches.\r
\r
\r
2. Decompression algorithm (inflate)\r
\r
2.1 Introduction\r
\r
The key question is how to represent a Huffman code (or any prefix code) so\r
that you can decode fast.  The most important characteristic is that shorter\r
codes are much more common than longer codes, so pay attention to decoding the\r
short codes fast, and let the long codes take longer to decode.\r
\r
inflate() sets up a first level table that covers some number of bits of\r
input less than the length of longest code.  It gets that many bits from the\r
stream, and looks it up in the table.  The table will tell if the next\r
code is that many bits or less and how many, and if it is, it will tell\r
the value, else it will point to the next level table for which inflate()\r
grabs more bits and tries to decode a longer code.\r
\r
How many bits to make the first lookup is a tradeoff between the time it\r
takes to decode and the time it takes to build the table.  If building the\r
table took no time (and if you had infinite memory), then there would only\r
be a first level table to cover all the way to the longest code.  However,\r
building the table ends up taking a lot longer for more bits since short\r
codes are replicated many times in such a table.  What inflate() does is\r
simply to make the number of bits in the first table a variable, and  then\r
to set that variable for the maximum speed.\r
\r
For inflate, which has 286 possible codes for the literal/length tree, the size\r
of the first table is nine bits.  Also the distance trees have 30 possible\r
values, and the size of the first table is six bits.  Note that for each of\r
those cases, the table ended up one bit longer than the ``average'' code\r
length, i.e. the code length of an approximately flat code which would be a\r
little more than eight bits for 286 symbols and a little less than five bits\r
for 30 symbols.\r
\r
\r
2.2 More details on the inflate table lookup\r
\r
Ok, you want to know what this cleverly obfuscated inflate tree actually\r
looks like.  You are correct that it's not a Huffman tree.  It is simply a\r
lookup table for the first, let's say, nine bits of a Huffman symbol.  The\r
symbol could be as short as one bit or as long as 15 bits.  If a particular\r
symbol is shorter than nine bits, then that symbol's translation is duplicated\r
in all those entries that start with that symbol's bits.  For example, if the\r
symbol is four bits, then it's duplicated 32 times in a nine-bit table.  If a\r
symbol is nine bits long, it appears in the table once.\r
\r
If the symbol is longer than nine bits, then that entry in the table points\r
to another similar table for the remaining bits.  Again, there are duplicated\r
entries as needed.  The idea is that most of the time the symbol will be short\r
and there will only be one table look up.  (That's whole idea behind data\r
compression in the first place.)  For the less frequent long symbols, there\r
will be two lookups.  If you had a compression method with really long\r
symbols, you could have as many levels of lookups as is efficient.  For\r
inflate, two is enough.\r
\r
So a table entry either points to another table (in which case nine bits in\r
the above example are gobbled), or it contains the translation for the symbol\r
and the number of bits to gobble.  Then you start again with the next\r
ungobbled bit.\r
\r
You may wonder: why not just have one lookup table for how ever many bits the\r
longest symbol is?  The reason is that if you do that, you end up spending\r
more time filling in duplicate symbol entries than you do actually decoding.\r
At least for deflate's output that generates new trees every several 10's of\r
kbytes.  You can imagine that filling in a 2^15 entry table for a 15-bit code\r
would take too long if you're only decoding several thousand symbols.  At the\r
other extreme, you could make a new table for every bit in the code.  In fact,\r
that's essentially a Huffman tree.  But then you spend two much time\r
traversing the tree while decoding, even for short symbols.\r
\r
So the number of bits for the first lookup table is a trade of the time to\r
fill out the table vs. the time spent looking at the second level and above of\r
the table.\r
\r
Here is an example, scaled down:\r
\r
The code being decoded, with 10 symbols, from 1 to 6 bits long:\r
\r
A: 0\r
B: 10\r
C: 1100\r
D: 11010\r
E: 11011\r
F: 11100\r
G: 11101\r
H: 11110\r
I: 111110\r
J: 111111\r
\r
Let's make the first table three bits long (eight entries):\r
\r
000: A,1\r
001: A,1\r
010: A,1\r
011: A,1\r
100: B,2\r
101: B,2\r
110: -> table X (gobble 3 bits)\r
111: -> table Y (gobble 3 bits)\r
\r
Each entry is what the bits decode as and how many bits that is, i.e. how\r
many bits to gobble.  Or the entry points to another table, with the number of\r
bits to gobble implicit in the size of the table.\r
\r
Table X is two bits long since the longest code starting with 110 is five bits\r
long:\r
\r
00: C,1\r
01: C,1\r
10: D,2\r
11: E,2\r
\r
Table Y is three bits long since the longest code starting with 111 is six\r
bits long:\r
\r
000: F,2\r
001: F,2\r
010: G,2\r
011: G,2\r
100: H,2\r
101: H,2\r
110: I,3\r
111: J,3\r
\r
So what we have here are three tables with a total of 20 entries that had to\r
be constructed.  That's compared to 64 entries for a single table.  Or\r
compared to 16 entries for a Huffman tree (six two entry tables and one four\r
entry table).  Assuming that the code ideally represents the probability of\r
the symbols, it takes on the average 1.25 lookups per symbol.  That's compared\r
to one lookup for the single table, or 1.66 lookups per symbol for the\r
Huffman tree.\r
\r
There, I think that gives you a picture of what's going on.  For inflate, the\r
meaning of a particular symbol is often more than just a letter.  It can be a\r
byte (a "literal"), or it can be either a length or a distance which\r
indicates a base value and a number of bits to fetch after the code that is\r
added to the base value.  Or it might be the special end-of-block code.  The\r
data structures created in inftrees.c try to encode all that information\r
compactly in the tables.\r
\r
\r
Jean-loup Gailly        Mark Adler\r
jloup@gzip.org          madler@alumni.caltech.edu\r
\r
\r
References:\r
\r
[LZ77] Ziv J., Lempel A., ``A Universal Algorithm for Sequential Data\r
Compression,'' IEEE Transactions on Information Theory, Vol. 23, No. 3,\r
pp. 337-343.\r
\r
``DEFLATE Compressed Data Format Specification'' available in\r
http://www.ietf.org/rfc/rfc1951.txt\r