Computational problems in infinite groups -8mm - CARMA · PDF fileComputational problems in...
Transcript of Computational problems in infinite groups -8mm - CARMA · PDF fileComputational problems in...
Computationalproblemsininfinitegroups
Laura Volker Murray Andrew BuksCiobanu Diekert Elder Rechnitzer vanRensburg
MathematicsandComputation, CARMA June2015
.
PartI:Equationsinfreegroups
Let A = a1, a−11 , . . . , ad, a
−1d .
Let RA ⊂ A∗ bethesetofallwordsthatdonotcontainany aia−1i or
a−1i ai pair. Wecallsuchwords reduced.
The freegroup on A, denoted FA, isthesetofallreducedwordswiththeoperationof concatenatethenreduce.
Let Ω = X1, X−11 , . . . , Xs, X−1
s beanotherset.
An equationin FA isanexpression U = V where U, V ∈ (A ∪ Ω)∗.
...Eg: a−1X = Yb aXXb = YYbX
A solution totheequationisamap Xj 7→ uj, X−1j 7→ u−1
j with uj ∈ RAwhichmakes U = V truein FA.
2
PartI:Equationsinfreegroups
Let A = a1, a−11 , . . . , ad, a
−1d .
Let RA ⊂ A∗ bethesetofallwordsthatdonotcontainany aia−1i or
a−1i ai pair. Wecallsuchwords reduced.
The freegroup on A, denoted FA, isthesetofallreducedwordswiththeoperationof concatenatethenreduce.
Let Ω = X1, X−11 , . . . , Xs, X−1
s beanotherset.
An equationin FA isanexpression U = V where U, V ∈ (A ∪ Ω)∗.
...Eg: a−1X = Yb aXXb = YYbX
A solution totheequationisamap Xj 7→ uj, X−1j 7→ u−1
j with uj ∈ RAwhichmakes U = V truein FA.
2
PartI:Equationsinfreegroups
Let A = a1, a−11 , . . . , ad, a
−1d .
Let RA ⊂ A∗ bethesetofallwordsthatdonotcontainany aia−1i or
a−1i ai pair. Wecallsuchwords reduced.
The freegroup on A, denoted FA, isthesetofallreducedwordswiththeoperationof concatenatethenreduce.
Let Ω = X1, X−11 , . . . , Xs, X−1
s beanotherset.
An equationin FA isanexpression U = V where U, V ∈ (A ∪ Ω)∗.
...Eg: a−1X = Yb aXXb = YYbX
A solution totheequationisamap Xj 7→ uj, X−1j 7→ u−1
j with uj ∈ RAwhichmakes U = V truein FA.
2
PartI:Equationsinfreegroups
Let A = a1, a−11 , . . . , ad, a
−1d .
Let RA ⊂ A∗ bethesetofallwordsthatdonotcontainany aia−1i or
a−1i ai pair. Wecallsuchwords reduced.
The freegroup on A, denoted FA, isthesetofallreducedwordswiththeoperationof concatenatethenreduce.
Let Ω = X1, X−11 , . . . , Xs, X−1
s beanotherset.
An equationin FA isanexpression U = V where U, V ∈ (A ∪ Ω)∗.
...Eg: a−1X = Yb aXXb = YYbX
A solution totheequationisamap Xj 7→ uj, X−1j 7→ u−1
j with uj ∈ RAwhichmakes U = V truein FA.
2
Equationsinfreegroups
...
Eg: aXXb = YYbX
Y→ aY aXXb = aYaYbX
XXb = YaYbX
X→ Xb−1 Xb−1Xb−1b = YaYbXb−1
Xb−1X = YaYbXb−1
...
3
History
1982Makanin: algorithmtodecideifanequationinafreegrouphasasolution
Algorithmextremelyinefficient, timecomplexity DTIME
(22
222poly(n)
)1987Razborov: algorithmicdescriptionofallsolutions(usingMakanin)
1990KoscielskiandPacholski: Makanin’sschemenotprimitiverecursive
1998Plandowski: newapproachtosolvingequationsover freemonoidsinPSPACE using datacompression
2000Gutierrez: solvingequationsoverfreegroupsinPSPACE
2013Jez: new recompression technique–simpliedallpreviousproofs
2014Diekert, JezandPlandowski: NSPACE(n2) algorithm
4
History
1982Makanin: algorithmtodecideifanequationinafreegrouphasasolution
Algorithmextremelyinefficient, timecomplexity DTIME
(22
222poly(n)
)
1987Razborov: algorithmicdescriptionofallsolutions(usingMakanin)
1990KoscielskiandPacholski: Makanin’sschemenotprimitiverecursive
1998Plandowski: newapproachtosolvingequationsover freemonoidsinPSPACE using datacompression
2000Gutierrez: solvingequationsoverfreegroupsinPSPACE
2013Jez: new recompression technique–simpliedallpreviousproofs
2014Diekert, JezandPlandowski: NSPACE(n2) algorithm
4
History
1982Makanin: algorithmtodecideifanequationinafreegrouphasasolution
Algorithmextremelyinefficient, timecomplexity DTIME
(22
222poly(n)
)1987Razborov: algorithmicdescriptionofallsolutions(usingMakanin)
1990KoscielskiandPacholski: Makanin’sschemenotprimitiverecursive
1998Plandowski: newapproachtosolvingequationsover freemonoidsinPSPACE using datacompression
2000Gutierrez: solvingequationsoverfreegroupsinPSPACE
2013Jez: new recompression technique–simpliedallpreviousproofs
2014Diekert, JezandPlandowski: NSPACE(n2) algorithm
4
History
1982Makanin: algorithmtodecideifanequationinafreegrouphasasolution
Algorithmextremelyinefficient, timecomplexity DTIME
(22
222poly(n)
)1987Razborov: algorithmicdescriptionofallsolutions(usingMakanin)
1990KoscielskiandPacholski: Makanin’sschemenotprimitiverecursive
1998Plandowski: newapproachtosolvingequationsover freemonoidsinPSPACE using datacompression
2000Gutierrez: solvingequationsoverfreegroupsinPSPACE
2013Jez: new recompression technique–simpliedallpreviousproofs
2014Diekert, JezandPlandowski: NSPACE(n2) algorithm
4
History
1982Makanin: algorithmtodecideifanequationinafreegrouphasasolution
Algorithmextremelyinefficient, timecomplexity DTIME
(22
222poly(n)
)1987Razborov: algorithmicdescriptionofallsolutions(usingMakanin)
1990KoscielskiandPacholski: Makanin’sschemenotprimitiverecursive
1998Plandowski: newapproachtosolvingequationsover freemonoidsinPSPACE using datacompression
2000Gutierrez: solvingequationsoverfreegroupsinPSPACE
2013Jez: new recompression technique–simpliedallpreviousproofs
2014Diekert, JezandPlandowski: NSPACE(n2) algorithm
4
History
1982Makanin: algorithmtodecideifanequationinafreegrouphasasolution
Algorithmextremelyinefficient, timecomplexity DTIME
(22
222poly(n)
)1987Razborov: algorithmicdescriptionofallsolutions(usingMakanin)
1990KoscielskiandPacholski: Makanin’sschemenotprimitiverecursive
1998Plandowski: newapproachtosolvingequationsover freemonoidsinPSPACE using datacompression
2000Gutierrez: solvingequationsoverfreegroupsinPSPACE
2013Jez: new recompression technique–simpliedallpreviousproofs
2014Diekert, JezandPlandowski: NSPACE(n2) algorithm
4
History
1982Makanin: algorithmtodecideifanequationinafreegrouphasasolution
Algorithmextremelyinefficient, timecomplexity DTIME
(22
222poly(n)
)1987Razborov: algorithmicdescriptionofallsolutions(usingMakanin)
1990KoscielskiandPacholski: Makanin’sschemenotprimitiverecursive
1998Plandowski: newapproachtosolvingequationsover freemonoidsinPSPACE using datacompression
2000Gutierrez: solvingequationsoverfreegroupsinPSPACE
2013Jez: new recompression technique–simpliedallpreviousproofs
2014Diekert, JezandPlandowski: NSPACE(n2) algorithm
4
History
1982Makanin: algorithmtodecideifanequationinafreegrouphasasolution
Algorithmextremelyinefficient, timecomplexity DTIME
(22
222poly(n)
)1987Razborov: algorithmicdescriptionofallsolutions(usingMakanin)
1990KoscielskiandPacholski: Makanin’sschemenotprimitiverecursive
1998Plandowski: newapproachtosolvingequationsover freemonoidsinPSPACE using datacompression
2000Gutierrez: solvingequationsoverfreegroupsinPSPACE
2013Jez: new recompression technique–simpliedallpreviousproofs
2014Diekert, JezandPlandowski: NSPACE(n2) algorithm
4
Howcomplicatedaresolutionsets?
Wewereinterestedinunderstandingthesetofsolutionstoanequationasaformallanguage
u1# . . .#us | uj ∈ RA, Xj 7→ uj solves U = V.
Weaskedhowcomplicatedsolutionssetscanbe, intermsofformallanguages.
Itisclearthatthesetofsolutionstoanyequationisrecognisedbyalinearboundedautomatonsosolutionsarecontext-sensitive.
Buttheyareevensimpler:
Theorem(Ciobanu, Diekert, E 2015)
ThesetofsolutionsinreducedwordstoanequationinafreegroupisEDT0L.
5
Howcomplicatedaresolutionsets?
Wewereinterestedinunderstandingthesetofsolutionstoanequationasaformallanguage
u1# . . .#us | uj ∈ RA, Xj 7→ uj solves U = V.
Weaskedhowcomplicatedsolutionssetscanbe, intermsofformallanguages.
Itisclearthatthesetofsolutionstoanyequationisrecognisedbyalinearboundedautomatonsosolutionsarecontext-sensitive.
Buttheyareevensimpler:
Theorem(Ciobanu, Diekert, E 2015)
ThesetofsolutionsinreducedwordstoanequationinafreegroupisEDT0L.
5
Howcomplicatedaresolutionsets?
Wewereinterestedinunderstandingthesetofsolutionstoanequationasaformallanguage
u1# . . .#us | uj ∈ RA, Xj 7→ uj solves U = V.
Weaskedhowcomplicatedsolutionssetscanbe, intermsofformallanguages.
Itisclearthatthesetofsolutionstoanyequationisrecognisedbyalinearboundedautomatonsosolutionsarecontext-sensitive.
Buttheyareevensimpler:
Theorem(Ciobanu, Diekert, E 2015)
ThesetofsolutionsinreducedwordstoanequationinafreegroupisEDT0L.
5
Howcomplicatedaresolutionsets?
Wewereinterestedinunderstandingthesetofsolutionstoanequationasaformallanguage
u1# . . .#us | uj ∈ RA, Xj 7→ uj solves U = V.
Weaskedhowcomplicatedsolutionssetscanbe, intermsofformallanguages.
Itisclearthatthesetofsolutionstoanyequationisrecognisedbyalinearboundedautomatonsosolutionsarecontext-sensitive.
Buttheyareevensimpler:
Theorem(Ciobanu, Diekert, E 2015)
ThesetofsolutionsinreducedwordstoanequationinafreegroupisEDT0L.
5
Howcomplicatedaresolutionsets?
Theorem(Ciobanu, Diekert, E 2015)
ThesetofsolutionsinreducedwordstoanequationinafreegroupisEDT0L.
Moreprecisely, weprovethatthesetofsolutionsisequalto
h(#) | h ∈ Rwhere R isaregularlanguageofendomorphismsover C ⊇ A ∪ #,
theNFA accepting R canbeconstructedinNSPACE(n log n),
andtheequationhaszero/finitelymanysolutionsifftheNFA hasnoacceptstate/nocycle.
6
Howcomplicatedaresolutionsets?
Theorem(Ciobanu, Diekert, E 2015)
ThesetofsolutionsinreducedwordstoanequationinafreegroupisEDT0L.
Thisisasurprisingresult–beforeMakaninitwasthoughttheproblemcouldbeundecidable,
andtryingtoobtainactualsolutionsbyfollowingMakanin-likeschemes(eg. using Makanin-Razborovdiagrams)seemsprettyhopeless.
Ourresultsaysyoucandescribethesetofallsolutionsinaparticularlyeasyway.
7
Outlineoftheproof
1. Reducetotheproblemoffindingallsolutionstoanequationoverafreemonoidwithinvolution over A = ai, ai.
2. Constructafinitegraphwithverticeslabeledby extendedequations, andedgeswhichenablethefollowingmovesbetweenthem:
– popvariables X→ aX, X→ Xa or X, X→ 1 (equationlengthgrows)
– compresspairsofconstants ab→ c (equationlengthshrinks,
– compressblocksofconstants aa . . . a→ aℓ alphabetofconstantsgrows)
Wefixanenlargedsetofconstantswithinvolution C ⊃ A ofsizeO(|UV|+ |A|) andrestricttoextendedequationsover C ∪ Ω oflengthatmostafixedboundin O(|UV|+ |A|).
Thisguaranteesthegraphisfinite. Wemustprovethatthegraphencodesallsolutionswiththeserestrictions.
8
Outlineoftheproof
1. Reducetotheproblemoffindingallsolutionstoanequationoverafreemonoidwithinvolution over A = ai, ai.
2. Constructafinitegraphwithverticeslabeledby extendedequations, andedgeswhichenablethefollowingmovesbetweenthem:
– popvariables X→ aX, X→ Xa or X, X→ 1 (equationlengthgrows)
– compresspairsofconstants ab→ c (equationlengthshrinks,
– compressblocksofconstants aa . . . a→ aℓ alphabetofconstantsgrows)
Wefixanenlargedsetofconstantswithinvolution C ⊃ A ofsizeO(|UV|+ |A|) andrestricttoextendedequationsover C ∪ Ω oflengthatmostafixedboundin O(|UV|+ |A|).
Thisguaranteesthegraphisfinite. Wemustprovethatthegraphencodesallsolutionswiththeserestrictions.
8
Outlineoftheproof
1. Reducetotheproblemoffindingallsolutionstoanequationoverafreemonoidwithinvolution over A = ai, ai.
2. Constructafinitegraphwithverticeslabeledby extendedequations, andedgeswhichenablethefollowingmovesbetweenthem:
– popvariables X→ aX, X→ Xa or X, X→ 1 (equationlengthgrows)
– compresspairsofconstants ab→ c (equationlengthshrinks,
– compressblocksofconstants aa . . . a→ aℓ alphabetofconstantsgrows)
Wefixanenlargedsetofconstantswithinvolution C ⊃ A ofsizeO(|UV|+ |A|) andrestricttoextendedequationsover C ∪ Ω oflengthatmostafixedboundin O(|UV|+ |A|).
Thisguaranteesthegraphisfinite. Wemustprovethatthegraphencodesallsolutionswiththeserestrictions.
8
Provingthegraphcontainssolutions
Wedefinean initialvertex tobelabeledbyanextendedequationwithU = V, anda finalvertex tobelabeledbyanextendedequationwithP = P where P ∈ C∗ (ie. novariables).
Edgesaredefinedsothatasolutiontothetargetextendedequationimpliesasolutiontothesourceextendedequation.
Itfollowsthatapathfrominitialtofinalverticesencodesasequenceofmovesontheequation U = V convertingittoanequation P = P withnovariables. Since P = P hasasolution, itcanbecarriedbacktoasolutionfor U = V.
9
Provingthegraphcontainssolutions
Wedefinean initialvertex tobelabeledbyanextendedequationwithU = V, anda finalvertex tobelabeledbyanextendedequationwithP = P where P ∈ C∗ (ie. novariables).
Edgesaredefinedsothatasolutiontothetargetextendedequationimpliesasolutiontothesourceextendedequation.
Itfollowsthatapathfrominitialtofinalverticesencodesasequenceofmovesontheequation U = V convertingittoanequation P = P withnovariables. Since P = P hasasolution, itcanbecarriedbacktoasolutionfor U = V.
9
Provingthegraphcontainssolutions
Wedefinean initialvertex tobelabeledbyanextendedequationwithU = V, anda finalvertex tobelabeledbyanextendedequationwithP = P where P ∈ C∗ (ie. novariables).
Edgesaredefinedsothatasolutiontothetargetextendedequationimpliesasolutiontothesourceextendedequation.
Itfollowsthatapathfrominitialtofinalverticesencodesasequenceofmovesontheequation U = V convertingittoanequation P = P withnovariables. Since P = P hasasolution, itcanbecarriedbacktoasolutionfor U = V.
9
Provingthegraphcontains all solutions
Supposewe know asolution Xj → ui for U = V.
Sinceweknowwhatthesolutionis, wecouldsimplyfollow X→ aX,X→ 1 edgesuntilallvariablesdisappear, andarriveatafinalvertex.
Butthiswouldtakeusoutofthegraph.
Notethataswepop, thenumberofvariablesintheequationneverincreases, andthesubstringsofconstantsinbetweenthemgrowinlength.
Applyingthecompressionmovesshrinkstheequationbackdown, sowecancontinuepoppingtofindasolution.
10
Provingthegraphcontains all solutions
Supposewe know asolution Xj → ui for U = V.
Sinceweknowwhatthesolutionis, wecouldsimplyfollow X→ aX,X→ 1 edgesuntilallvariablesdisappear, andarriveatafinalvertex.
Butthiswouldtakeusoutofthegraph.
Notethataswepop, thenumberofvariablesintheequationneverincreases, andthesubstringsofconstantsinbetweenthemgrowinlength.
Applyingthecompressionmovesshrinkstheequationbackdown, sowecancontinuepoppingtofindasolution.
10
Provingthegraphcontains all solutions
Supposewe know asolution Xj → ui for U = V.
Sinceweknowwhatthesolutionis, wecouldsimplyfollow X→ aX,X→ 1 edgesuntilallvariablesdisappear, andarriveatafinalvertex.
Butthiswouldtakeusoutofthegraph.
Notethataswepop, thenumberofvariablesintheequationneverincreases, andthesubstringsofconstantsinbetweenthemgrowinlength.
Applyingthecompressionmovesshrinkstheequationbackdown, sowecancontinuepoppingtofindasolution.
10
Provingthegraphcontains all solutions
Hereistheprocedure. Put n = |UV|+ |A|.
– Assumeequationlengthisatmost29n (trueforaninitialvertex).
– Popthefirstandlastletterfromeachvariable. Nowtheequationlengthisatmost31n.
– Runasubroutine(blockcompression)toreplacemaximalblocksaa . . . a by a. Nowtheequationhasno aa factors, andlengthatmost31n.
– Runasubroutine(paircompression)whichappliesthemovesab→ c inacarefulwaytoensurethattheequationlengthreducestoatmost29n. Repeat.
Eachroundreducesthe weight ofthesolution(definedasthesumofthelengthofwordssubstitutedforeachvariable)sotheprocedureterminatesatafinalvertex.
11
Provingthegraphcontains all solutions
Hereistheprocedure. Put n = |UV|+ |A|.
– Assumeequationlengthisatmost29n (trueforaninitialvertex).
– Popthefirstandlastletterfromeachvariable. Nowtheequationlengthisatmost31n.
– Runasubroutine(blockcompression)toreplacemaximalblocksaa . . . a by a. Nowtheequationhasno aa factors, andlengthatmost31n.
– Runasubroutine(paircompression)whichappliesthemovesab→ c inacarefulwaytoensurethattheequationlengthreducestoatmost29n. Repeat.
Eachroundreducesthe weight ofthesolution(definedasthesumofthelengthofwordssubstitutedforeachvariable)sotheprocedureterminatesatafinalvertex.
11
Provingthegraphcontains all solutions
Hereistheprocedure. Put n = |UV|+ |A|.
– Assumeequationlengthisatmost29n (trueforaninitialvertex).
– Popthefirstandlastletterfromeachvariable. Nowtheequationlengthisatmost31n.
– Runasubroutine(blockcompression)toreplacemaximalblocksaa . . . a by a. Nowtheequationhasno aa factors, andlengthatmost31n.
– Runasubroutine(paircompression)whichappliesthemovesab→ c inacarefulwaytoensurethattheequationlengthreducestoatmost29n. Repeat.
Eachroundreducesthe weight ofthesolution(definedasthesumofthelengthofwordssubstitutedforeachvariable)sotheprocedureterminatesatafinalvertex.
11
Provingthegraphcontains all solutions
Hereistheprocedure. Put n = |UV|+ |A|.
– Assumeequationlengthisatmost29n (trueforaninitialvertex).
– Popthefirstandlastletterfromeachvariable. Nowtheequationlengthisatmost31n.
– Runasubroutine(blockcompression)toreplacemaximalblocksaa . . . a by a. Nowtheequationhasno aa factors, andlengthatmost31n.
– Runasubroutine(paircompression)whichappliesthemovesab→ c inacarefulwaytoensurethattheequationlengthreducestoatmost29n. Repeat.
Eachroundreducesthe weight ofthesolution(definedasthesumofthelengthofwordssubstitutedforeachvariable)sotheprocedureterminatesatafinalvertex.
11
Provingthegraphcontains all solutions
Hereistheprocedure. Put n = |UV|+ |A|.
– Assumeequationlengthisatmost29n (trueforaninitialvertex).
– Popthefirstandlastletterfromeachvariable. Nowtheequationlengthisatmost31n.
– Runasubroutine(blockcompression)toreplacemaximalblocksaa . . . a by a. Nowtheequationhasno aa factors, andlengthatmost31n.
– Runasubroutine(paircompression)whichappliesthemovesab→ c inacarefulwaytoensurethattheequationlengthreducestoatmost29n. Repeat.
Eachroundreducesthe weight ofthesolution(definedasthesumofthelengthofwordssubstitutedforeachvariable)sotheprocedureterminatesatafinalvertex.
11
MoredetailsinourpapertoappearinICALP2015proceedings, longerversiontoappearIJAC.
12
PartII:Cogrowth
Let G beagroupwithpresentation ⟨S | R⟩, so G ∼= FS/⟨⟨R⟩⟩.
...Eg: Z2 = ⟨a, b | aba−1b−1⟩ Fa,b,a−1,b−1 = ⟨a, b | −⟩
Define cn = # wordsin ⟨⟨R⟩⟩ oflength n. Thefunction n 7→ cn iscalledthe cogrowthfunction for (G, S).
cn ≤ (2|S|)(2|S| − 1)n−1 so lim sup c1/nn ≤ 2|S| − 1
Theorem(Grigorchuk/Cohen)
LetG beanon-freegroup. G is amenable iff lim sup c1/nn = 2|S| − 1.
13
PartII:Cogrowth
Let G beagroupwithpresentation ⟨S | R⟩, so G ∼= FS/⟨⟨R⟩⟩.
...Eg: Z2 = ⟨a, b | aba−1b−1⟩ Fa,b,a−1,b−1 = ⟨a, b | −⟩
Define cn = # wordsin ⟨⟨R⟩⟩ oflength n. Thefunction n 7→ cn iscalledthe cogrowthfunction for (G, S).
cn ≤ (2|S|)(2|S| − 1)n−1 so lim sup c1/nn ≤ 2|S| − 1
Theorem(Grigorchuk/Cohen)
LetG beanon-freegroup. G is amenable iff lim sup c1/nn = 2|S| − 1.
13
PartII:Cogrowth
Let G beagroupwithpresentation ⟨S | R⟩, so G ∼= FS/⟨⟨R⟩⟩.
...Eg: Z2 = ⟨a, b | aba−1b−1⟩ Fa,b,a−1,b−1 = ⟨a, b | −⟩
Define cn = # wordsin ⟨⟨R⟩⟩ oflength n. Thefunction n 7→ cn iscalledthe cogrowthfunction for (G, S).
cn ≤ (2|S|)(2|S| − 1)n−1 so lim sup c1/nn ≤ 2|S| − 1
Theorem(Grigorchuk/Cohen)
LetG beanon-freegroup. G is amenable iff lim sup c1/nn = 2|S| − 1.
13
Cogrowth
Theformalpowerseries f(z) =∑
cnzn isthe cogrowthseries.
lim sup c1/nn isthereciprocaloftheradiusofconvergenceof f(z). Wecall
thisnumberthe cogrowth.
14
Example
G = ⟨a | a2⟩. Weconsider a, a−1 asdistinctformalsymbols, so:
c2n+1 = 0 sincetherelatorhasevenlength
c0 = 1 ϵc2 = 2 aa, a−1a−1
c4 = 2 aaaa, a−1a−1a−1a−1
...
f(z) = 1+∞∑n=1
2z2n = 1+ 2
(1
1− z2− 1
)=
1+ z2
1− z2
(radiusofconvergenceis1)
Theorem(Kouksov)
LetG beanon-freegroup. ThecogrowthseriesisrationaliffG isfinite.
15
Example
G = ⟨a | a2⟩. Weconsider a, a−1 asdistinctformalsymbols, so:
c2n+1 = 0 sincetherelatorhasevenlength
c0 = 1 ϵc2 = 2 aa, a−1a−1
c4 = 2 aaaa, a−1a−1a−1a−1
...
f(z) = 1+∞∑n=1
2z2n = 1+ 2
(1
1− z2− 1
)=
1+ z2
1− z2
(radiusofconvergenceis1)
Theorem(Kouksov)
LetG beanon-freegroup. ThecogrowthseriesisrationaliffG isfinite.
15
Example
G = ⟨a | a2⟩. Weconsider a, a−1 asdistinctformalsymbols, so:
c2n+1 = 0 sincetherelatorhasevenlength
c0 = 1 ϵc2 = 2 aa, a−1a−1
c4 = 2 aaaa, a−1a−1a−1a−1
...
f(z) = 1+∞∑n=1
2z2n = 1+ 2
(1
1− z2− 1
)=
1+ z2
1− z2
(radiusofconvergenceis1)
Theorem(Kouksov)
LetG beanon-freegroup. ThecogrowthseriesisrationaliffG isfinite.
15
Example
G = ⟨a | a2⟩. Weconsider a, a−1 asdistinctformalsymbols, so:
c2n+1 = 0 sincetherelatorhasevenlength
c0 = 1 ϵc2 = 2 aa, a−1a−1
c4 = 2 aaaa, a−1a−1a−1a−1
...
f(z) = 1+∞∑n=1
2z2n = 1+ 2
(1
1− z2− 1
)=
1+ z2
1− z2
(radiusofconvergenceis1)
Theorem(Kouksov)
LetG beanon-freegroup. ThecogrowthseriesisrationaliffG isfinite.
15
Alternativedn = # all wordsin (S ∪ S−1)∗ equaltoid
Thereareformulastoswitchbetween dn and cn atthelevelofgeneratingfunctions
Theorem(Grigorchuk/Cohen)
G isamenableiff lim sup d1/nn = 2|S|.
16
Z2 = ⟨a, b | aba−1b−1⟩
..
id
.
17
Z2 = ⟨a, b | aba−1b−1⟩
..
id
.
18
Z2 = ⟨a, b | aba−1b−1⟩
..
id
.a a b−1 b a b a−1 a b a−1 b a−1 a−1 b−1 a−1 b−1 b−1 a+ + − + + + − + + − + − − − − − − ++ + + − + − − + − − − − − + − + + +
d2n =(2nn
)(2nn
)d2n+1 = 0
19
Z2 = ⟨a, b | aba−1b−1⟩
..
id
.a a b−1 b a b a−1 a b a−1 b a−1 a−1 b−1 a−1 b−1 b−1 a+ + − + + + − + + − + − − − − − − ++ + + − + − − + − − − − − + − + + +
d2n =(2nn
)(2nn
)d2n+1 = 0
19
Openproblemforamenability
A famousopenproblemiswhetheroneparticular(infamous)exampleisamenable:
RichardThompson’sgroup F = ⟨a, b | [ab−1, a−1ba], [ab−1, a−2ba2]⟩
Severalauthorshavetriedcomputationalapproachestotheproblem:
– Burillo, Cleary, Weist2007
– Arzhantseva, Guba, Lustig, Préaux2008
– E,Rechnitzer, Wong2012
– Haagarup, Haagarup, Ramirez-Solano2015
20
Openproblemforamenability
A famousopenproblemiswhetheroneparticular(infamous)exampleisamenable:
RichardThompson’sgroup F = ⟨a, b | [ab−1, a−1ba], [ab−1, a−2ba2]⟩
Severalauthorshavetriedcomputationalapproachestotheproblem:
– Burillo, Cleary, Weist2007
– Arzhantseva, Guba, Lustig, Préaux2008
– E,Rechnitzer, Wong2012
– Haagarup, Haagarup, Ramirez-Solano2015
20
Newmethod: “Randomwalkonthesetoftrivialwords”
G = ⟨S | R⟩
X = ⟨⟨R⟩⟩
R = allfreelyreducedcyclicpermutationsofwordsin R ∪ R−1
P : R → [0, 1] aprobdistst P(r) > 0 and P(r) = P(r−1) forall r ∈ R
Wedefinea Markovchain withstates X andtransitionsbetweenstates(trivialwords)withprescribedprobabilities
sothatmovesare“uniquelyreversible”andthereisapositiveprobabilityofreachingeverystatefromanygivenstate.
21
Newmethod: “Randomwalkonthesetoftrivialwords”
G = ⟨S | R⟩
X = ⟨⟨R⟩⟩
R = allfreelyreducedcyclicpermutationsofwordsin R ∪ R−1
P : R → [0, 1] aprobdistst P(r) > 0 and P(r) = P(r−1) forall r ∈ R
Wedefinea Markovchain withstates X andtransitionsbetweenstates(trivialwords)withprescribedprobabilities
sothatmovesare“uniquelyreversible”andthereisapositiveprobabilityofreachingeverystatefromanygivenstate.
21
Newmethod: “Randomwalkonthesetoftrivialwords”
G = ⟨S | R⟩
X = ⟨⟨R⟩⟩
R = allfreelyreducedcyclicpermutationsofwordsin R ∪ R−1
P : R → [0, 1] aprobdistst P(r) > 0 and P(r) = P(r−1) forall r ∈ R
Wedefinea Markovchain withstates X andtransitionsbetweenstates(trivialwords)withprescribedprobabilities
sothatmovesare“uniquelyreversible”andthereisapositiveprobabilityofreachingeverystatefromanygivenstate.
21
Moveson w ∈ X1. Conjugation by x ∈ S ∪ S−1:
– write xwx−1 andfreelyreducetoobtain w′.
2. Left-insertion by r ∈ R atposition m ∈ [0, |w|]:– write w = uv with |v| = m– freelyreduce ur toobtain u′
– freelyreduce u′v toobtain w′
– ifanypartof v iscancelled, set w′ = w (rejectthemove)
Lemma
Eachmoveis uniquelyreversible inthefollowingsense:conjugationby x←→ conjugationby x−1
left-insertionof r at m←→ left-insertionof r−1 at m
22
MetropolisMCMC algorithm
Next, wedefinethetransitionprobabilitiesforourMarkovchain. Letpc, β ∈ (0, 1) and α ∈ R beparameters.
Let wn bethecurrentword. Constructthenextword wn+1 asfollows:
1. Withprobability pc, choosetodoaconjugation, else(1− pc)chooseaninsertion.
2. Ifconjugation, choose s ∈ S ∪ S−1 withprobability 12|S| , and
conjugatetoobtain w′.
Withprobability min
1,
(|w′|+ 1)1+α
(|w|+ 1)1+α· β
|w′|
β|w|
put wn+1 = w′.
Elseput wn+1 = wn (rejectthemove)
23
MetropolisMCMC algorithm
3. Ifleft-insertion, choose r ∈ R withprobability P(r) andm ∈ [0, |w|] withuniformprobability. Left-inserttoobtain w′.
Withprobability min
1,
(|w′|+ 1)α
(|w|+ 1)α· β
|w′|
β|w|
put wn+1 = w′.
Elseput wn+1 = wn (rejectthemove)
Eg: G = ⟨a | a2⟩. Thestatespace X is
:::: a−4 :::: a−2 :::: ϵ :::: a2 :::: a4 ::::Startingat w0 = a2k
S conjugation: nochange
S left-insert a±2: moveleft/right(ornochangeifrejected)
24
MetropolisMCMC algorithm
3. Ifleft-insertion, choose r ∈ R withprobability P(r) andm ∈ [0, |w|] withuniformprobability. Left-inserttoobtain w′.
Withprobability min
1,
(|w′|+ 1)α
(|w|+ 1)α· β
|w′|
β|w|
put wn+1 = w′.
Elseput wn+1 = wn (rejectthemove)
Eg: G = ⟨a | a2⟩. Thestatespace X is
:::: a−4 :::: a−2 :::: ϵ :::: a2 :::: a4 ::::Startingat w0 = a2k
S conjugation: nochange
S left-insert a±2: moveleft/right(ornochangeifrejected)
24
MetropolisMCMC algorithm
Theprobabilitiesarechosenspecificallysothatwecanprovethat:
thereisaprobabilitydistribution π on X suchthattheprobabilitythatthealgorithmreachesstate w afterN stepsconvergesto π(w).
If Pr(u→ v) istheprobabilityofmovingfrom u to v inonestep, adistributionis stationary fortheMC if π(u) =
∑v Pr(v→ u)π(v).
Theorem(E,Rechnitzer, vanRensburg)
π(w) =(|w|+ 1)1+αβ|w|
Z
where Z isanormalisingconstantistheuniquestationarydistributionforthealgorithm.
i.e. theprobabilitythatthealgorithmreachesstate w after N stepsconvergesto π(w).
25
MetropolisMCMC algorithm
Theprobabilitiesarechosenspecificallysothatwecanprovethat:
thereisaprobabilitydistribution π on X suchthattheprobabilitythatthealgorithmreachesstate w afterN stepsconvergesto π(w).
If Pr(u→ v) istheprobabilityofmovingfrom u to v inonestep, adistributionis stationary fortheMC if π(u) =
∑v Pr(v→ u)π(v).
Theorem(E,Rechnitzer, vanRensburg)
π(w) =(|w|+ 1)1+αβ|w|
Z
where Z isanormalisingconstantistheuniquestationarydistributionforthealgorithm.
i.e. theprobabilitythatthealgorithmreachesstate w after N stepsconvergesto π(w).
25
MetropolisMCMC algorithm
Theprobabilitiesarechosenspecificallysothatwecanprovethat:
thereisaprobabilitydistribution π on X suchthattheprobabilitythatthealgorithmreachesstate w afterN stepsconvergesto π(w).
If Pr(u→ v) istheprobabilityofmovingfrom u to v inonestep, adistributionis stationary fortheMC if π(u) =
∑v Pr(v→ u)π(v).
Theorem(E,Rechnitzer, vanRensburg)
π(w) =(|w|+ 1)1+αβ|w|
Z
where Z isanormalisingconstantistheuniquestationarydistributionforthealgorithm.
i.e. theprobabilitythatthealgorithmreachesstate w after N stepsconvergesto π(w).
25
Relationtocogrowth
Since π isaprobabilitydistributionwehave∑w∈X
π(w) = 1
sosince π(w) =(|w|+ 1)1+αβ|w|
Zweget
Z =∑w∈X
(|w|+ 1)1+αβ|w| =∑n
cn(n+ 1)1+αβn
whichconvergeswhen β islessthantheradiusofconvergenceofthecogrowthseries (= recipofcogrowthrate)
26
Relationtocogrowth
Themeanlengthofawordsampledbyrunningthealgorithmis
E(|w|) =∑u∈X|u|π(u) =
∑u∈X|u|(|u|+ 1)1+αβ|u|
Z
=∑n
n(n+ 1)1+αβncnZ
=
∑n n(n+ 1)1+αβncn∑n (n+ 1)1+αβncn
As β → recipofcogrowthrate(frombelow), themeanlength→ +∞
27
Z2 = ⟨a, b | aba−1b−1⟩
0.25 0.275 0.3 0.325
β
0
50
100
〈n〉
Themeanlengthofsampledwordsplottedagainst β for ⟨a, b | aba−1b−1⟩ withα = 1. Thecrossesindicatedataobtainedfromanimplementationofthealgorithmwhilethecurveindicatestheexpectationderivedfromtheexactcogrowthseriesforthegroup. Theverticallineindicates βc = 1/3.
28
Freeproduct ⟨a, b, c|a2, b2, c2⟩
0.15 0.2
β
0
50
100
〈n〉
Meanlengthofsampledwordsvs. β for ⟨a, b, c|a2, b2, c2⟩ sampledwith α = 1.Thecrossesindicatedataobtainedfromthealgorithm, whilethecurvesindicatestheexpectationderivedfromtheexactcogrowthseries(foundbyKouksov).Verticallinesat 1/5 and0.2192752634(thereciprocalofthecogrowth).
29
Baumslag-Solitar(3,3)
0.2 0.3 0.4
β
0
50
100
150
〈n〉
Meanlengthofsampledwordsvs. β for BS(3, 3) = ⟨a, b | ba3b−1a−3⟩ withα = 1. Thecrossesindicatedataobtainedfromthealgorithm, whilethecurvesindicatestheexpectationderivedfromthe(known)cogrowthseriesforthegroup(foundbyE,Rechnitzer, vanRensburgandWong). Verticallinesat 1/3 and0.417525628(thereciprocalofthecogrowth).
30
Surfacegroup ⟨a, b, c, d | [a, b][c, d]⟩
0.1 0.2 0.3 0.4
β
0
20
40
60
〈n〉
Meanlengthsampledwordsvs. β forthepresentation ⟨a, b, c, d | [a, b][c, d]⟩for α = 1. Bluelinesindicateboundsupperandlowerbounds0.35473, 0.3547provenbyNagnibedaandGouëzel.
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Thompson’sgroup F
Let F = ⟨a, b | [ab−1, a−1ba], [ab−1, a−2ba2]⟩
|S| = 2 soif F isamenable, lim sup c1/nn = 3
andwewouldexpectthemeanlengthofwordssampledbytheMCalgorithmtoblowupat 1/3.
Let’srunthealgorithm . . .
0.25 0.3 0.35 0.4
β
0
20
40
60
〈n〉
32
Thompson’sgroup F
Let F = ⟨a, b | [ab−1, a−1ba], [ab−1, a−2ba2]⟩
|S| = 2 soif F isamenable, lim sup c1/nn = 3
andwewouldexpectthemeanlengthofwordssampledbytheMCalgorithmtoblowupat 1/3.
Let’srunthealgorithm . . .
0.25 0.3 0.35 0.4
β
0
20
40
60
〈n〉
32
Thompson’sgroup F
Anotherpresentation⟨a, b, c, d | c = a−1ba, d = a−1ca, [ab−1, c], [ab−1, d]⟩ forF
0.1 0.15
β
0
20
40
60
〈n〉
33
Willthismethodevergiveaproof?
ThereareveryfewexamplesofMarkovchainalgorithmsforwhichonecan prove rateofconvergencetothestationarydistribution.
Eg: shuffleadeckofcardsbyselectingacardatrandomandplacingitatthebottomofthedeck
Startwith onthebottomofthedeck, when isontop, stop–uniformdistribution.
CameronRogersisexploringpathalogicalcasesthatbreakthealgorithm
Eg: ⟨a, b | abab−1a−1b−1, anb⟩
aswellasconnectionsbetweenconvergenceofthewalkandcomplexityoftheFølnerfunction.
34
Willthismethodevergiveaproof?
ThereareveryfewexamplesofMarkovchainalgorithmsforwhichonecan prove rateofconvergencetothestationarydistribution.
Eg: shuffleadeckofcardsbyselectingacardatrandomandplacingitatthebottomofthedeck
Startwith onthebottomofthedeck, when isontop, stop–uniformdistribution.
CameronRogersisexploringpathalogicalcasesthatbreakthealgorithm
Eg: ⟨a, b | abab−1a−1b−1, anb⟩
aswellasconnectionsbetweenconvergenceofthewalkandcomplexityoftheFølnerfunction.
34
Willthismethodevergiveaproof?
ThereareveryfewexamplesofMarkovchainalgorithmsforwhichonecan prove rateofconvergencetothestationarydistribution.
Eg: shuffleadeckofcardsbyselectingacardatrandomandplacingitatthebottomofthedeck
Startwith onthebottomofthedeck, when isontop, stop–uniformdistribution.
CameronRogersisexploringpathalogicalcasesthatbreakthealgorithm
Eg: ⟨a, b | abab−1a−1b−1, anb⟩
aswellasconnectionsbetweenconvergenceofthewalkandcomplexityoftheFølnerfunction.
34
MoredetailsinourpapertoappearinExperimentalMathematics.
35