# regex - tester - regular expression examples

## Does lookaround affect which languages can be matched by regular expressions? (3)

As the other answers claim, lookarounds don't add any extra power to regular expressions.

I think we can show this using the following:

One Pebble 2-NFA (see the Introduction section of the paper which refers to it).

The 1-pebble 2NFA does not deal with nested lookaheads, but, we can use a variant of multi-pebble 2NFAs (see section below).

**Introduction**

A 2-NFA is a non deterministic finite automaton which has the ability to move either left or right on it's input.

A one pebble machine is where the machine can place a pebble on the input tape (i.e. mark a specific input symbol with a pebble) and do possibly different transitions based on whether there is a pebble at the current input position or not.

It is known the One Pebble 2-NFA has the same power as a regular DFA.

**Non-nested Lookaheads**

The basic idea is as follows:

The 2NFA allows us to backtrack (or 'front track') by moving forward or backward in the input tape. So for a lookahead we can do the match for the lookahead regular expression and then backtrack what we have consumed, in matching the lookahead expression. In order to know exactly when to stop backtracking, we use the pebble! We drop the pebble before we enter the dfa for the lookahead to mark the spot where the backtracking needs to stop.

Thus at the end of running our string through the pebble 2NFA, we know whether we matched the lookahead expression or not and the input left (i.e. what is left to be consumed) is exactly what is required to match the remaining.

So for a lookahead of the form u(?=v)w

We have the DFAs for u, v and w.

From the accepting state (yes, we can assume there is only one) of DFA for u, we make an e-transition to the start state of v, marking the input with a pebble.

From an accepting state for v, we e-transtion to a state which keeps moving the input left, till it finds a pebble, and then transitions to start state of w.

From a rejecting state of v, we e-transition to a state which keeps moving left until it finds the pebble, and transtions to the accepting state of u (i.e where we left off).

The proof used for regular NFAs to show r1 | r2, or r* etc, carry over for these one pebble 2nfas. See http://www.coli.uni-saarland.de/projects/milca/courses/coal/html/node41.html#regularlanguages.sec.regexptofsa for more info on how the component machines are put together to give the bigger machine for the r* expression etc.

The reason why the above proofs for r* etc work is that the backtracking ensures that the input pointer is always at the right spot, when we enter the component nfas for repetition. Also, if a pebble is in use, then it is being processed by one of the lookahead component machines. Since there are no transitions from lookahead machine to lookahead machine without completely backtracking and getting back the pebble, a one pebble machine is all that is needed.

For eg consider ([^a] | a(?=...b))*

and the string abbb.

We have abbb which goes through the peb2nfa for a(?=...b), at the end of which we are at the state: (bbb, matched) (i.e in input bbb is remaining, and it has matched 'a' followed by '..b'). Now because of the *, we go back to the beginning (see the construction in the link above), and enter the dfa for [^a]. Match b, go back to beginning, enter [^a] again two times, and then accept.

**Dealing with Nested Lookaheads**

To handle nested lookaheads we can use a restricted version of k-pebble 2NFA as defined here: Complexity Results for Two-Way and Multi-Pebble Automata and their Logics (see Definition 4.1 and Theorem 4.2).

In general, 2 pebble automata can accept non-regular sets, but with the following restrictions, k-pebble automata can be shown to be regular (Theorem 4.2 in above paper).

If the pebbles are P_1, P_2, ..., P_K

P_{i+1} may not be placed unless P_i is already on the tape and P_{i} may not be picked up unless P_{i+1} is not on the tape. Basically the pebbles need to be used in a LIFO fashion.

Between the time P_{i+1} is placed and the time that either P_{i} is picked up or P_{i+2} is placed, the automaton can traverse only the subword located between the current location of P_{i} and the end of the input word that lies in the direction of P_{i+1}. Moreover, in this sub-word, the automaton can act only as a 1-pebble automaton with Pebble P_{i+1}. In particular it is not allowed to lift up, place or even sense the presence of another pebble.

So if v is a nested lookahead expression of depth k, then (?=v) is a nested lookahead expression of depth k+1. When we enter a lookahead machine within, we know exactly how many pebbles have to have been placed so far and so can exactly determine which pebble to place and when we exit that machine, we know which pebble to lift. All machines at depth t are entered by placing pebble t and exited (i.e. we return to processing of a depth t-1 machine) by removing pebble t. Any run of the complete machine looks like a recursive dfs call of a tree and the above two restrictions of the multi-pebble machine can be catered to.

Now when you combine expressions, for rr1, since you concat, the pebble numbers of r1 must be incremented by the depth of r. For r* and r|r1 the pebble numbering remains the same.

Thus any expression with lookaheads can be converted to an equivalent multi-pebble machine with the above restrictions in pebble placement and so is regular.

**Conclusion**

This basically addresses the drawback in Francis's original proof: being able to prevent the lookahead expressions from consuming anything which are required for future matches.

Since Lookbehinds are just finite string (not really regexs) we can deal with them first, and then deal with the lookaheads.

Sorry for the incomplete writeup, but a complete proof would involve drawing a lot of figures.

It looks right to me, but I will be glad to know of any mistakes (which I seem to be fond of :-)).

There are some features in modern regex engines which allow you to match languages that couldn't be matched without that feature. For example the following regex using back references matches the language of all strings that consist of a word that repeats itself: `(.+)\1`

. This language is not regular and can't be matched by a regex that does not use back references.

Does lookaround also affect which languages can be matched by a regular expression? I.e. are there any languages that can be matched using lookaround that couldn't be matched otherwise? If so, is this true for all flavors of lookaround (negative or positive lookahead or lookbehind) or just for some of them?

I agree with the other posts that lookaround is regular (meaning that it does not add any fundamental capability to regular expressions), but I have an argument for it that is simpler IMO than the other ones I have seen.

I will show that lookaround is regular by providing a DFA construction. A language is regular if and only if it has a DFA that recognizes it. Note that Perl doesn't actually use DFAs internally (see this paper for details: http://swtch.com/~rsc/regexp/regexp1.html) but we construct a DFA for purposes of the proof.

The traditional way of constructing a DFA for a regular expression is to first build an NFA using Thompson's Algorithm. Given two regular expressions fragments `r1`

and `r2`

, Thompson's Algorithm provides constructions for concatenation (`r1r2`

), alternation (`r1|r2`

), and repetition (`r1*`

) of regular expressions. This allows you to build a NFA bit by bit that recognizes the original regular expression. See the paper above for more details.

To show that positive and negative lookahead are regular, I will provide a construction for concatenation of a regular expression `u`

with positive or negative lookahead: `(?=v)`

or `(?!v)`

. Only concatenation requires special treatment; the usual alternation and repetition constructions work fine.

The construction is for both u(?=v) and u(?!v) is:

In other words, connect every final state of the existing NFA for `u`

to both an accept state *and* to an NFA for `v`

, but modified as follows. The function `f(v)`

is defined as:

- Let
`aa(v)`

be a function on an NFA`v`

that changes every accept state into an "anti-accept state". An anti-accept state is defined to be a state that causes the match to fail if*any*path through the NFA ends in this state for a given string`s`

, even if a different path through`v`

for`s`

ends in an accept state. - Let
`loop(v)`

be a function on an NFA`v`

that adds a self-transition on any accept state. In other words, once a path leads to an accept state, that path can stay in the accept state forever no matter what input follows. - For negative lookahead,
`f(v) = aa(loop(v))`

. - For positive lookahead,
`f(v) = aa(neg(v))`

.

To provide an intuitive example for why this works, I will use the regex `(b|a(?:.b))+`

, which is a slightly simplified version of the regex I proposed in the comments of Francis's proof. If we use my construction along with the traditional Thompson constructions, we end up with:

The `e`

s are epsilon transitions (transitions that can be taken without consuming any input) and the anti-accept states are labeled with an `X`

. In the left half of the graph you see the representation of `(a|b)+`

: any `a`

or `b`

puts the graph in an accept state, but also allows a transition back to the begin state so we can do it again. But note that every time we match an `a`

we also enter the right half of the graph, where we are in anti-accept states until we match "any" followed by a `b`

.

This is not a traditional NFA because traditional NFAs don't have anti-accept states. However we can use the traditional NFA->DFA algorithm to convert this into a traditional DFA. The algorithm works like usual, where we simulate multiple runs of the NFA by making our DFA states correspond to subsets of the NFA states we could possibly be in. The one twist is that we slightly augment the rule for deciding if a DFA state is an accept (final) state or not. In the traditional algorithm a DFA state is an accept state if *any* of the NFA states was an accept state. We modify this to say that a DFA state is an accept state if and only if:

= 1 NFA states is an accept state,

*and*- 0 NFA states are anti-accept states.

This algorithm will give us a DFA that recognizes the regular expression with lookahead. Ergo, lookahead is regular. Note that lookbehind requires a separate proof.

The answer to the question you ask, which is whether a larger class of languages than the regular languages can be recognised with regular expressions augmented by lookaround, is no.

A proof is relatively straightforward, but an algorithm to translate a regular expression containing lookarounds into one without is messy.

First: note that you can always negate a regular expression (over a finite alphabet). Given a finite state automaton that recognises the language generated by the expression, you can simply exchange all the accepting states for non-accepting states to get an FSA that recognises exactly the negation of that language, for which there are a family of equivalent regular expressions.

Second: because regular languages (and hence regular expressions) are closed under negation they are also closed under intersection since A intersect B = neg ( neg(A) union neg(B)) by de Morgan's laws. In other words given two regular expressions, you can find another regular expression that matches both.

This allows you to simulate lookaround expressions. For example u(?=v)w matches only expressions that will match uv and uw.

For negative lookahead you need the regular expression equivalent of the set theoretic A\B, which is just A intersect (neg B) or equivalently neg (neg(A) union B). Thus for any regular expressions r and s you can find a regular expression r-s which matches those expressions that match r which do not match s. In negative lookahead terms: u(?!v)w matches only those expressions which match uw - uv.

There are two reasons why lookaround is useful.

First, because the negation of a regular expression can result in something much less tidy. For example `q(?!u)=q($|[^u])`

.

Second, regular expressions do more than match expressions, they also consume characters from a string - or at least that's how we like to think about them. For example in python I care about the .start() and .end(), thus of course:

```
>>> re.search('q($|[^u])', 'Iraq!').end()
5
>>> re.search('q(?!u)', 'Iraq!').end()
4
```

Third, and I think this is a pretty important reason, negation of regular expressions does not lift nicely over concatenation. neg(a)neg(b) is not the same thing as neg(ab), which means that you cannot translate a lookaround out of the context in which you find it - you have to process the whole string. I guess that makes it unpleasant for people to work with and breaks people's intuitions about regular expressions.

I hope I have answered your theoretical question (its late at night, so forgive me if I am unclear). I agree with a commentator who said that this does have practical applications. I met very much the same problem when trying to scrape some very complicated web pages.

**EDIT**

My apologies for not being clearer: I do not believe you can give a proof of regularity of regular expressions + lookarounds by structural induction, my u(?!v)w example was meant to be just that, an example, and an easy one at that. The reason a structural induction won't work is because lookarounds behave in a non-compositional way - the point I was trying to make about negations above. I suspect any direct formal proof is going to have lots of messy details. I have tried to think of an easy way to show it but cannot come up with one off the top of my head.

To illustrate using Josh's first example of `^([^a]|(?=..b))*$`

this is equivalent to a 7 state DFSA with all states accepting:

```
A - (a) -> B - (a) -> C --- (a) --------> D
Λ | \ |
| (not a) \ (b)
| | \ |
| v \ v
(b) E - (a) -> F \-(not(a)--> G
| <- (b) - / |
| | |
| (not a) |
| | |
| v |
\--------- H <-------------------(b)-----/
```

The regular expression for state A alone looks like:

```
^(a([^a](ab)*[^a]|a(ab|[^a])*b)b)*$
```

In other words any regular expression you are going to get by eliminating lookarounds will in general be much longer and much messier.

To respond to Josh's comment - yes I do think the most direct way to prove the equivalence is via the FSA. What makes this messier is that the usual way to construct an FSA is via a non-deterministic machine - its much easier to express u|v as simply the machine constructed from machines for u and v with an epsilon transition to the two of them. Of course this is equivalent to a deterministic machine, but at the risk of exponential blow-up of states. Whereas negation is much easier to do via a deterministic machine.

The general proof will involve taking the cartesian product of two machines and selecting those states you wish to retain at each point you want to insert a lookaround. The example above illustrates what I mean to some extent.

My apologies for not supplying a construction.

**FURTHER EDIT:**
I have found a blog post which describes an algorithm for generating a DFA out of a regular expression augmented with lookarounds. Its neat because the author extends the idea of an NFA-e with "tagged epsilon transitions" in the obvious way, and then explains how to convert such an automaton into a DFA.

I thought something like that would be a way to do it, but I'm pleased that someone has written it up. It was beyond me to come up with something so neat.